freebsd-nq/module/zfs/zpl_file.c

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/*
* CDDL HEADER START
*
* The contents of this file are subject to the terms of the
* Common Development and Distribution License (the "License").
* You may not use this file except in compliance with the License.
*
* You can obtain a copy of the license at usr/src/OPENSOLARIS.LICENSE
* or http://www.opensolaris.org/os/licensing.
* See the License for the specific language governing permissions
* and limitations under the License.
*
* When distributing Covered Code, include this CDDL HEADER in each
* file and include the License file at usr/src/OPENSOLARIS.LICENSE.
* If applicable, add the following below this CDDL HEADER, with the
* fields enclosed by brackets "[]" replaced with your own identifying
* information: Portions Copyright [yyyy] [name of copyright owner]
*
* CDDL HEADER END
*/
/*
* Copyright (c) 2011, Lawrence Livermore National Security, LLC.
* Copyright (c) 2015 by Chunwei Chen. All rights reserved.
*/
#ifdef CONFIG_COMPAT
#include <linux/compat.h>
#endif
Update build system and packaging Minimal changes required to integrate the SPL sources in to the ZFS repository build infrastructure and packaging. Build system and packaging: * Renamed SPL_* autoconf m4 macros to ZFS_*. * Removed redundant SPL_* autoconf m4 macros. * Updated the RPM spec files to remove SPL package dependency. * The zfs package obsoletes the spl package, and the zfs-kmod package obsoletes the spl-kmod package. * The zfs-kmod-devel* packages were updated to add compatibility symlinks under /usr/src/spl-x.y.z until all dependent packages can be updated. They will be removed in a future release. * Updated copy-builtin script for in-kernel builds. * Updated DKMS package to include the spl.ko. * Updated stale AUTHORS file to include all contributors. * Updated stale COPYRIGHT and included the SPL as an exception. * Renamed README.markdown to README.md * Renamed OPENSOLARIS.LICENSE to LICENSE. * Renamed DISCLAIMER to NOTICE. Required code changes: * Removed redundant HAVE_SPL macro. * Removed _BOOT from nvpairs since it doesn't apply for Linux. * Initial header cleanup (removal of empty headers, refactoring). * Remove SPL repository clone/build from zimport.sh. * Use of DEFINE_RATELIMIT_STATE and DEFINE_SPINLOCK removed due to build issues when forcing C99 compilation. * Replaced legacy ACCESS_ONCE with READ_ONCE. * Include needed headers for `current` and `EXPORT_SYMBOL`. Reviewed-by: Tony Hutter <hutter2@llnl.gov> Reviewed-by: Olaf Faaland <faaland1@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Pavel Zakharov <pavel.zakharov@delphix.com> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> TEST_ZIMPORT_SKIP="yes" Closes #7556
2018-02-16 01:53:18 +00:00
#include <sys/file.h>
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
#include <sys/dmu_objset.h>
#include <sys/zfs_vfsops.h>
#include <sys/zfs_vnops.h>
#include <sys/zfs_znode.h>
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
#include <sys/zfs_project.h>
static int
zpl_open(struct inode *ip, struct file *filp)
{
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
error = generic_file_open(ip, filp);
if (error)
return (error);
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_open(ip, filp->f_mode, filp->f_flags, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
static int
zpl_release(struct inode *ip, struct file *filp)
{
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
cookie = spl_fstrans_mark();
Write dirty inodes on close When the property atime=on is set operations which only access and inode do cause an atime update. However, it turns out that dirty inodes with updated atimes are only written to disk when the inodes get evicted from the cache. Somewhat surprisingly the source suggests that this isn't a ZoL specific issue. This behavior may in part explain why zfs's reclaim logic has been observed to be slow. When reclaiming inodes its likely that they have a dirty atime which will force a write to disk. Obviously we don't want to force a write to disk for every atime update, these needs to be batched. The right way to do this is to fully implement the .dirty_inode and .write_inode callbacks. However, to do that right requires proper unification of some fields in the znode/inode. Then we could just mark the inode dirty and leave it to the VFS to call .write_inode periodically. Until that work gets done we have to settle for some middle ground. The simplest and safest thing we can do for now is to write the dirty inode on last close. This should prevent the majority of inodes in the cache from having dirty atimes and not drastically increase the number of writes. Some rudimentally testing to show how long it takes to drop 500,000 inodes from the cache shows promising results. This is as expected because we're no longer do lots of IO as part of the eviction, it was done earlier during the close. w/out patch: ~30s to drop 500,000 inodes with drop_caches. with patch: ~3s to drop 500,000 inodes with drop_caches. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov>
2013-07-26 17:38:49 +00:00
if (ITOZ(ip)->z_atime_dirty)
zfs_mark_inode_dirty(ip);
Write dirty inodes on close When the property atime=on is set operations which only access and inode do cause an atime update. However, it turns out that dirty inodes with updated atimes are only written to disk when the inodes get evicted from the cache. Somewhat surprisingly the source suggests that this isn't a ZoL specific issue. This behavior may in part explain why zfs's reclaim logic has been observed to be slow. When reclaiming inodes its likely that they have a dirty atime which will force a write to disk. Obviously we don't want to force a write to disk for every atime update, these needs to be batched. The right way to do this is to fully implement the .dirty_inode and .write_inode callbacks. However, to do that right requires proper unification of some fields in the znode/inode. Then we could just mark the inode dirty and leave it to the VFS to call .write_inode periodically. Until that work gets done we have to settle for some middle ground. The simplest and safest thing we can do for now is to write the dirty inode on last close. This should prevent the majority of inodes in the cache from having dirty atimes and not drastically increase the number of writes. Some rudimentally testing to show how long it takes to drop 500,000 inodes from the cache shows promising results. This is as expected because we're no longer do lots of IO as part of the eviction, it was done earlier during the close. w/out patch: ~30s to drop 500,000 inodes with drop_caches. with patch: ~3s to drop 500,000 inodes with drop_caches. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov>
2013-07-26 17:38:49 +00:00
crhold(cr);
error = -zfs_close(ip, filp->f_flags, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
static int
zpl_iterate(struct file *filp, zpl_dir_context_t *ctx)
{
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_readdir(file_inode(filp), ctx, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
#if !defined(HAVE_VFS_ITERATE) && !defined(HAVE_VFS_ITERATE_SHARED)
static int
zpl_readdir(struct file *filp, void *dirent, filldir_t filldir)
{
zpl_dir_context_t ctx =
ZPL_DIR_CONTEXT_INIT(dirent, filldir, filp->f_pos);
int error;
error = zpl_iterate(filp, &ctx);
filp->f_pos = ctx.pos;
return (error);
}
#endif /* !HAVE_VFS_ITERATE && !HAVE_VFS_ITERATE_SHARED */
#if defined(HAVE_FSYNC_WITH_DENTRY)
/*
* Linux 2.6.x - 2.6.34 API,
* Through 2.6.34 the nfsd kernel server would pass a NULL 'file struct *'
* to the fops->fsync() hook. For this reason, we must be careful not to
* use filp unconditionally.
*/
static int
zpl_fsync(struct file *filp, struct dentry *dentry, int datasync)
{
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_fsync(dentry->d_inode, datasync, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
#ifdef HAVE_FILE_AIO_FSYNC
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
static int
zpl_aio_fsync(struct kiocb *kiocb, int datasync)
{
struct file *filp = kiocb->ki_filp;
return (zpl_fsync(filp, file_dentry(filp), datasync));
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
}
#endif
#elif defined(HAVE_FSYNC_WITHOUT_DENTRY)
/*
* Linux 2.6.35 - 3.0 API,
* As of 2.6.35 the dentry argument to the fops->fsync() hook was deemed
* redundant. The dentry is still accessible via filp->f_path.dentry,
* and we are guaranteed that filp will never be NULL.
*/
static int
zpl_fsync(struct file *filp, int datasync)
{
struct inode *inode = filp->f_mapping->host;
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_fsync(inode, datasync, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
#ifdef HAVE_FILE_AIO_FSYNC
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
static int
zpl_aio_fsync(struct kiocb *kiocb, int datasync)
{
return (zpl_fsync(kiocb->ki_filp, datasync));
}
#endif
#elif defined(HAVE_FSYNC_RANGE)
/*
* Linux 3.1 - 3.x API,
* As of 3.1 the responsibility to call filemap_write_and_wait_range() has
* been pushed down in to the .fsync() vfs hook. Additionally, the i_mutex
* lock is no longer held by the caller, for zfs we don't require the lock
* to be held so we don't acquire it.
*/
static int
zpl_fsync(struct file *filp, loff_t start, loff_t end, int datasync)
{
struct inode *inode = filp->f_mapping->host;
cred_t *cr = CRED();
int error;
fstrans_cookie_t cookie;
error = filemap_write_and_wait_range(inode->i_mapping, start, end);
if (error)
return (error);
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_fsync(inode, datasync, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
ASSERT3S(error, <=, 0);
return (error);
}
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
#ifdef HAVE_FILE_AIO_FSYNC
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
static int
zpl_aio_fsync(struct kiocb *kiocb, int datasync)
{
return (zpl_fsync(kiocb->ki_filp, kiocb->ki_pos, -1, datasync));
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
}
#endif
#else
#error "Unsupported fops->fsync() implementation"
#endif
static ssize_t
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
zpl_read_common_iovec(struct inode *ip, const struct iovec *iovp, size_t count,
unsigned long nr_segs, loff_t *ppos, uio_seg_t segment, int flags,
cred_t *cr, size_t skip)
{
ssize_t read;
uio_t uio;
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
int error;
fstrans_cookie_t cookie;
uio.uio_iov = iovp;
uio.uio_skip = skip;
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
uio.uio_resid = count;
uio.uio_iovcnt = nr_segs;
uio.uio_loffset = *ppos;
uio.uio_limit = MAXOFFSET_T;
uio.uio_segflg = segment;
cookie = spl_fstrans_mark();
error = -zfs_read(ip, &uio, flags, cr);
spl_fstrans_unmark(cookie);
if (error < 0)
return (error);
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
read = count - uio.uio_resid;
*ppos += read;
return (read);
}
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
inline ssize_t
zpl_read_common(struct inode *ip, const char *buf, size_t len, loff_t *ppos,
uio_seg_t segment, int flags, cred_t *cr)
{
struct iovec iov;
iov.iov_base = (void *)buf;
iov.iov_len = len;
return (zpl_read_common_iovec(ip, &iov, len, 1, ppos, segment,
flags, cr, 0));
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
}
static ssize_t
zpl_iter_read_common(struct kiocb *kiocb, const struct iovec *iovp,
unsigned long nr_segs, size_t count, uio_seg_t seg, size_t skip)
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
{
cred_t *cr = CRED();
struct file *filp = kiocb->ki_filp;
ssize_t read;
crhold(cr);
read = zpl_read_common_iovec(filp->f_mapping->host, iovp, count,
nr_segs, &kiocb->ki_pos, seg, filp->f_flags, cr, skip);
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
crfree(cr);
Fix atime handling and relatime The problem for atime: We have 3 places for atime: inode->i_atime, znode->z_atime and SA. And its handling is a mess. A huge part of mess regarding atime comes from zfs_tstamp_update_setup, zfs_inode_update, and zfs_getattr, which behave inconsistently with those three values. zfs_tstamp_update_setup clears z_atime_dirty unconditionally as long as you don't pass ATTR_ATIME. Which means every write(2) operation which only updates ctime and mtime will cause atime changes to not be written to disk. Also zfs_inode_update from write(2) will replace inode->i_atime with what's inside SA(stale). But doesn't touch z_atime. So after read(2) and write(2). You'll have i_atime(stale), z_atime(new), SA(stale) and z_atime_dirty=0. Now, if you do stat(2), zfs_getattr will actually replace i_atime with what's inside, z_atime. So you will have now you'll have i_atime(new), z_atime(new), SA(stale) and z_atime_dirty=0. These will all gone after umount. And you'll leave with a stale atime. The problem for relatime: We do have a relatime config inside ZFS dataset, but how it should interact with the mount flag MS_RELATIME is not well defined. It seems it wanted relatime mount option to override the dataset config by showing it as temporary in `zfs get`. But at the same time, `zfs set relatime=on|off` would also seems to want to override the mount option. Not to mention that MS_RELATIME flag is actually never passed into ZFS, so it never really worked. How Linux handles atime: The Linux kernel actually handles atime completely in VFS, except for writing it to disk. So if we remove the atime handling in ZFS, things would just work, no matter it's strictatime, relatime, noatime, or even O_NOATIME. And whenever VFS updates the i_atime, it will notify the underlying filesystem via sb->dirty_inode(). And also there's one thing to note about atime flags like MS_RELATIME and other flags like MS_NODEV, etc. They are mount point flags rather than filesystem(sb) flags. Since native linux filesystem can be mounted at multiple places at the same time, they can all have different atime settings. So these flags are never passed down to filesystem drivers. What this patch tries to do: We remove znode->z_atime, since we won't gain anything from it. We remove most of the atime handling and leave it to VFS. The only thing we do with atime is to write it when dirty_inode() or setattr() is called. We also add file_accessed() in zpl_read() since it's not provided in vfs_read(). After this patch, only the MS_RELATIME flag will have effect. The setting in dataset won't do anything. We will make zfstuil to mount ZFS with MS_RELATIME set according to the setting in dataset in future patch. Signed-off-by: Chunwei Chen <david.chen@osnexus.com> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Issue #4482
2016-03-30 00:53:34 +00:00
file_accessed(filp);
return (read);
}
#if defined(HAVE_VFS_RW_ITERATE)
static ssize_t
zpl_iter_read(struct kiocb *kiocb, struct iov_iter *to)
{
ssize_t ret;
uio_seg_t seg = UIO_USERSPACE;
if (to->type & ITER_KVEC)
seg = UIO_SYSSPACE;
if (to->type & ITER_BVEC)
seg = UIO_BVEC;
ret = zpl_iter_read_common(kiocb, to->iov, to->nr_segs,
iov_iter_count(to), seg, to->iov_offset);
if (ret > 0)
iov_iter_advance(to, ret);
return (ret);
}
#else
static ssize_t
zpl_aio_read(struct kiocb *kiocb, const struct iovec *iovp,
unsigned long nr_segs, loff_t pos)
{
ssize_t ret;
size_t count;
ret = generic_segment_checks(iovp, &nr_segs, &count, VERIFY_WRITE);
if (ret)
return (ret);
return (zpl_iter_read_common(kiocb, iovp, nr_segs, count,
UIO_USERSPACE, 0));
}
#endif /* HAVE_VFS_RW_ITERATE */
static ssize_t
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
zpl_write_common_iovec(struct inode *ip, const struct iovec *iovp, size_t count,
unsigned long nr_segs, loff_t *ppos, uio_seg_t segment, int flags,
cred_t *cr, size_t skip)
{
ssize_t wrote;
uio_t uio;
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
int error;
fstrans_cookie_t cookie;
if (flags & O_APPEND)
*ppos = i_size_read(ip);
uio.uio_iov = iovp;
uio.uio_skip = skip;
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
uio.uio_resid = count;
uio.uio_iovcnt = nr_segs;
uio.uio_loffset = *ppos;
uio.uio_limit = MAXOFFSET_T;
uio.uio_segflg = segment;
cookie = spl_fstrans_mark();
error = -zfs_write(ip, &uio, flags, cr);
spl_fstrans_unmark(cookie);
if (error < 0)
return (error);
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
wrote = count - uio.uio_resid;
*ppos += wrote;
return (wrote);
}
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
inline ssize_t
zpl_write_common(struct inode *ip, const char *buf, size_t len, loff_t *ppos,
uio_seg_t segment, int flags, cred_t *cr)
{
struct iovec iov;
iov.iov_base = (void *)buf;
iov.iov_len = len;
return (zpl_write_common_iovec(ip, &iov, len, 1, ppos, segment,
flags, cr, 0));
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
}
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
static ssize_t
zpl_iter_write_common(struct kiocb *kiocb, const struct iovec *iovp,
unsigned long nr_segs, size_t count, uio_seg_t seg, size_t skip)
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
{
cred_t *cr = CRED();
struct file *filp = kiocb->ki_filp;
ssize_t wrote;
crhold(cr);
wrote = zpl_write_common_iovec(filp->f_mapping->host, iovp, count,
nr_segs, &kiocb->ki_pos, seg, filp->f_flags, cr, skip);
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
crfree(cr);
return (wrote);
}
#if defined(HAVE_VFS_RW_ITERATE)
static ssize_t
zpl_iter_write(struct kiocb *kiocb, struct iov_iter *from)
{
size_t count;
ssize_t ret;
uio_seg_t seg = UIO_USERSPACE;
#ifndef HAVE_GENERIC_WRITE_CHECKS_KIOCB
struct file *file = kiocb->ki_filp;
struct address_space *mapping = file->f_mapping;
struct inode *ip = mapping->host;
int isblk = S_ISBLK(ip->i_mode);
count = iov_iter_count(from);
ret = generic_write_checks(file, &kiocb->ki_pos, &count, isblk);
if (ret)
return (ret);
#else
/*
* XXX - ideally this check should be in the same lock region with
* write operations, so that there's no TOCTTOU race when doing
* append and someone else grow the file.
*/
ret = generic_write_checks(kiocb, from);
if (ret <= 0)
return (ret);
count = ret;
#endif
if (from->type & ITER_KVEC)
seg = UIO_SYSSPACE;
if (from->type & ITER_BVEC)
seg = UIO_BVEC;
ret = zpl_iter_write_common(kiocb, from->iov, from->nr_segs,
count, seg, from->iov_offset);
if (ret > 0)
iov_iter_advance(from, ret);
return (ret);
}
#else
static ssize_t
zpl_aio_write(struct kiocb *kiocb, const struct iovec *iovp,
unsigned long nr_segs, loff_t pos)
{
struct file *file = kiocb->ki_filp;
struct address_space *mapping = file->f_mapping;
struct inode *ip = mapping->host;
int isblk = S_ISBLK(ip->i_mode);
size_t count;
ssize_t ret;
ret = generic_segment_checks(iovp, &nr_segs, &count, VERIFY_READ);
if (ret)
return (ret);
ret = generic_write_checks(file, &pos, &count, isblk);
if (ret)
return (ret);
return (zpl_iter_write_common(kiocb, iovp, nr_segs, count,
UIO_USERSPACE, 0));
}
#endif /* HAVE_VFS_RW_ITERATE */
Direct IO support Direct IO via the O_DIRECT flag was originally introduced in XFS by IRIX for database workloads. Its purpose was to allow the database to bypass the page and buffer caches to prevent unnecessary IO operations (e.g. readahead) while preventing contention for system memory between the database and kernel caches. On Illumos, there is a library function called directio(3C) that allows user space to provide a hint to the file system that Direct IO is useful, but the file system is free to ignore it. The semantics are also entirely a file system decision. Those that do not implement it return ENOTTY. Since the semantics were never defined in any standard, O_DIRECT is implemented such that it conforms to the behavior described in the Linux open(2) man page as follows. 1. Minimize cache effects of the I/O. By design the ARC is already scan-resistant which helps mitigate the need for special O_DIRECT handling. Data which is only accessed once will be the first to be evicted from the cache. This behavior is in consistent with Illumos and FreeBSD. Future performance work may wish to investigate the benefits of immediately evicting data from the cache which has been read or written with the O_DIRECT flag. Functionally this behavior is very similar to applying the 'primarycache=metadata' property per open file. 2. O_DIRECT _MAY_ impose restrictions on IO alignment and length. No additional alignment or length restrictions are imposed. 3. O_DIRECT _MAY_ perform unbuffered IO operations directly between user memory and block device. No unbuffered IO operations are currently supported. In order to support features such as transparent compression, encryption, and checksumming a copy must be made to transform the data. 4. O_DIRECT _MAY_ imply O_DSYNC (XFS). O_DIRECT does not imply O_DSYNC for ZFS. Callers must provide O_DSYNC to request synchronous semantics. 5. O_DIRECT _MAY_ disable file locking that serializes IO operations. Applications should avoid mixing O_DIRECT and normal IO or mmap(2) IO to the same file. This is particularly true for overlapping regions. All I/O in ZFS is locked for correctness and this locking is not disabled by O_DIRECT. However, concurrently mixing O_DIRECT, mmap(2), and normal I/O on the same file is not recommended. This change is implemented by layering the aops->direct_IO operations on the existing AIO operations. Code already existed in ZFS on Linux for bypassing the page cache when O_DIRECT is specified. References: * http://xfs.org/docs/xfsdocs-xml-dev/XFS_User_Guide/tmp/en-US/html/ch02s09.html * https://blogs.oracle.com/roch/entry/zfs_and_directio * https://ext4.wiki.kernel.org/index.php/Clarifying_Direct_IO's_Semantics * https://illumos.org/man/3c/directio Reviewed-by: Richard Elling <Richard.Elling@RichardElling.com> Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #224 Closes #7823
2018-08-27 17:04:21 +00:00
#if defined(HAVE_VFS_RW_ITERATE)
static ssize_t
zpl_direct_IO_impl(int rw, struct kiocb *kiocb, struct iov_iter *iter)
{
if (rw == WRITE)
return (zpl_iter_write(kiocb, iter));
else
return (zpl_iter_read(kiocb, iter));
}
#if defined(HAVE_VFS_DIRECT_IO_ITER)
static ssize_t
zpl_direct_IO(struct kiocb *kiocb, struct iov_iter *iter)
{
return (zpl_direct_IO_impl(iov_iter_rw(iter), kiocb, iter));
}
#elif defined(HAVE_VFS_DIRECT_IO_ITER_OFFSET)
static ssize_t
zpl_direct_IO(struct kiocb *kiocb, struct iov_iter *iter, loff_t pos)
{
ASSERT3S(pos, ==, kiocb->ki_pos);
return (zpl_direct_IO_impl(iov_iter_rw(iter), kiocb, iter));
}
#elif defined(HAVE_VFS_DIRECT_IO_ITER_RW_OFFSET)
static ssize_t
zpl_direct_IO(int rw, struct kiocb *kiocb, struct iov_iter *iter, loff_t pos)
{
ASSERT3S(pos, ==, kiocb->ki_pos);
return (zpl_direct_IO_impl(rw, kiocb, iter));
}
#else
#error "Unknown direct IO interface"
#endif
#else
#if defined(HAVE_VFS_DIRECT_IO_IOVEC)
static ssize_t
zpl_direct_IO(int rw, struct kiocb *kiocb, const struct iovec *iovp,
loff_t pos, unsigned long nr_segs)
{
if (rw == WRITE)
return (zpl_aio_write(kiocb, iovp, nr_segs, pos));
else
return (zpl_aio_read(kiocb, iovp, nr_segs, pos));
}
#else
#error "Unknown direct IO interface"
#endif
#endif /* HAVE_VFS_RW_ITERATE */
static loff_t
zpl_llseek(struct file *filp, loff_t offset, int whence)
{
#if defined(SEEK_HOLE) && defined(SEEK_DATA)
fstrans_cookie_t cookie;
if (whence == SEEK_DATA || whence == SEEK_HOLE) {
struct inode *ip = filp->f_mapping->host;
loff_t maxbytes = ip->i_sb->s_maxbytes;
loff_t error;
spl_inode_lock_shared(ip);
cookie = spl_fstrans_mark();
error = -zfs_holey(ip, whence, &offset);
spl_fstrans_unmark(cookie);
if (error == 0)
error = lseek_execute(filp, ip, offset, maxbytes);
spl_inode_unlock_shared(ip);
return (error);
}
#endif /* SEEK_HOLE && SEEK_DATA */
return (generic_file_llseek(filp, offset, whence));
}
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
/*
* It's worth taking a moment to describe how mmap is implemented
* for zfs because it differs considerably from other Linux filesystems.
* However, this issue is handled the same way under OpenSolaris.
*
* The issue is that by design zfs bypasses the Linux page cache and
* leaves all caching up to the ARC. This has been shown to work
* well for the common read(2)/write(2) case. However, mmap(2)
* is problem because it relies on being tightly integrated with the
* page cache. To handle this we cache mmap'ed files twice, once in
* the ARC and a second time in the page cache. The code is careful
* to keep both copies synchronized.
*
* When a file with an mmap'ed region is written to using write(2)
* both the data in the ARC and existing pages in the page cache
* are updated. For a read(2) data will be read first from the page
* cache then the ARC if needed. Neither a write(2) or read(2) will
* will ever result in new pages being added to the page cache.
*
* New pages are added to the page cache only via .readpage() which
* is called when the vfs needs to read a page off disk to back the
* virtual memory region. These pages may be modified without
* notifying the ARC and will be written out periodically via
* .writepage(). This will occur due to either a sync or the usual
* page aging behavior. Note because a read(2) of a mmap'ed file
* will always check the page cache first even when the ARC is out
* of date correct data will still be returned.
*
* While this implementation ensures correct behavior it does have
* have some drawbacks. The most obvious of which is that it
* increases the required memory footprint when access mmap'ed
* files. It also adds additional complexity to the code keeping
* both caches synchronized.
*
* Longer term it may be possible to cleanly resolve this wart by
* mapping page cache pages directly on to the ARC buffers. The
* Linux address space operations are flexible enough to allow
* selection of which pages back a particular index. The trick
* would be working out the details of which subsystem is in
* charge, the ARC, the page cache, or both. It may also prove
* helpful to move the ARC buffers to a scatter-gather lists
* rather than a vmalloc'ed region.
*/
static int
zpl_mmap(struct file *filp, struct vm_area_struct *vma)
{
struct inode *ip = filp->f_mapping->host;
znode_t *zp = ITOZ(ip);
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
int error;
fstrans_cookie_t cookie;
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
cookie = spl_fstrans_mark();
error = -zfs_map(ip, vma->vm_pgoff, (caddr_t *)vma->vm_start,
(size_t)(vma->vm_end - vma->vm_start), vma->vm_flags);
spl_fstrans_unmark(cookie);
if (error)
return (error);
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
error = generic_file_mmap(filp, vma);
if (error)
return (error);
mutex_enter(&zp->z_lock);
zp->z_is_mapped = B_TRUE;
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
mutex_exit(&zp->z_lock);
return (error);
}
/*
* Populate a page with data for the Linux page cache. This function is
* only used to support mmap(2). There will be an identical copy of the
* data in the ARC which is kept up to date via .write() and .writepage().
*
* Current this function relies on zpl_read_common() and the O_DIRECT
* flag to read in a page. This works but the more correct way is to
* update zfs_fillpage() to be Linux friendly and use that interface.
*/
static int
zpl_readpage(struct file *filp, struct page *pp)
{
struct inode *ip;
struct page *pl[1];
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
int error = 0;
fstrans_cookie_t cookie;
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
ASSERT(PageLocked(pp));
ip = pp->mapping->host;
pl[0] = pp;
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
cookie = spl_fstrans_mark();
error = -zfs_getpage(ip, pl, 1);
spl_fstrans_unmark(cookie);
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
if (error) {
SetPageError(pp);
ClearPageUptodate(pp);
} else {
ClearPageError(pp);
SetPageUptodate(pp);
flush_dcache_page(pp);
}
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
unlock_page(pp);
return (error);
}
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
Correctly lock pages for .readpages() Unlike the .readpage() callback which is passed a single locked page to be populated. The .readpages() callback is passed a list of unlocked pages which are all marked for read-ahead (PG_readahead set). It is the responsibly of .readpages() to ensure to pages are properly locked before being populated. Prior to this change the requested read-ahead pages would be updated outside of the page lock which is unsafe. The unlocked pages would then be unlocked again which is harmless but should have been immediately detected as bug. Unfortunately, newer kernels failed detect this issue because the check is done with a VM_BUG_ON which is disabled by default. Luckily, the old Debian Lenny 2.6.26 kernel caught this because it simply uses a BUG_ON. The straight forward fix for this is to update the .readpages() callback to use the read_cache_pages() helper function. The helper function will ensure that each page in the list is properly locked before it is passed to the .readpage() callback. In addition resolving the bug, this results in a nice simplification of the existing code. The downside to this change is that instead of passing one large read request to the dmu multiple smaller ones are submitted. All of these requests however are marked for readahead so the lower layers should issue a large I/O regardless. Thus most of the request should hit the ARC cache. Futher optimization of this code can be done in the future is a perform analysis determines it to be worthwhile. But for the moment, it is preferable that code be correct and understandable. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #355
2011-08-04 23:25:43 +00:00
/*
* Populate a set of pages with data for the Linux page cache. This
* function will only be called for read ahead and never for demand
* paging. For simplicity, the code relies on read_cache_pages() to
* correctly lock each page for IO and call zpl_readpage().
*/
static int
zpl_readpages(struct file *filp, struct address_space *mapping,
struct list_head *pages, unsigned nr_pages)
Correctly lock pages for .readpages() Unlike the .readpage() callback which is passed a single locked page to be populated. The .readpages() callback is passed a list of unlocked pages which are all marked for read-ahead (PG_readahead set). It is the responsibly of .readpages() to ensure to pages are properly locked before being populated. Prior to this change the requested read-ahead pages would be updated outside of the page lock which is unsafe. The unlocked pages would then be unlocked again which is harmless but should have been immediately detected as bug. Unfortunately, newer kernels failed detect this issue because the check is done with a VM_BUG_ON which is disabled by default. Luckily, the old Debian Lenny 2.6.26 kernel caught this because it simply uses a BUG_ON. The straight forward fix for this is to update the .readpages() callback to use the read_cache_pages() helper function. The helper function will ensure that each page in the list is properly locked before it is passed to the .readpage() callback. In addition resolving the bug, this results in a nice simplification of the existing code. The downside to this change is that instead of passing one large read request to the dmu multiple smaller ones are submitted. All of these requests however are marked for readahead so the lower layers should issue a large I/O regardless. Thus most of the request should hit the ARC cache. Futher optimization of this code can be done in the future is a perform analysis determines it to be worthwhile. But for the moment, it is preferable that code be correct and understandable. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #355
2011-08-04 23:25:43 +00:00
{
return (read_cache_pages(mapping, pages,
(filler_t *)zpl_readpage, filp));
Correctly lock pages for .readpages() Unlike the .readpage() callback which is passed a single locked page to be populated. The .readpages() callback is passed a list of unlocked pages which are all marked for read-ahead (PG_readahead set). It is the responsibly of .readpages() to ensure to pages are properly locked before being populated. Prior to this change the requested read-ahead pages would be updated outside of the page lock which is unsafe. The unlocked pages would then be unlocked again which is harmless but should have been immediately detected as bug. Unfortunately, newer kernels failed detect this issue because the check is done with a VM_BUG_ON which is disabled by default. Luckily, the old Debian Lenny 2.6.26 kernel caught this because it simply uses a BUG_ON. The straight forward fix for this is to update the .readpages() callback to use the read_cache_pages() helper function. The helper function will ensure that each page in the list is properly locked before it is passed to the .readpage() callback. In addition resolving the bug, this results in a nice simplification of the existing code. The downside to this change is that instead of passing one large read request to the dmu multiple smaller ones are submitted. All of these requests however are marked for readahead so the lower layers should issue a large I/O regardless. Thus most of the request should hit the ARC cache. Futher optimization of this code can be done in the future is a perform analysis determines it to be worthwhile. But for the moment, it is preferable that code be correct and understandable. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #355
2011-08-04 23:25:43 +00:00
}
int
zpl_putpage(struct page *pp, struct writeback_control *wbc, void *data)
{
Cleanup mmap(2) writes While the existing implementation of .writepage()/zpl_putpage() was functional it was not entirely correct. In particular, it would move dirty pages in to a clean state simply after copying them in to the ARC cache. This would result in the pages being lost if the system were to crash enough though the Linux VFS believed them to be safe on stable storage. Since at the moment virtually all I/O, except mmap(2), bypasses the page cache this isn't as bad as it sounds. However, as hopefully start using the page cache more getting this right becomes more important so it's good to improve this now. This patch takes a big step in that direction by updating the code to correctly move dirty pages through a writeback phase before they are marked clean. When a dirty page is copied in to the ARC it will now be set in writeback and a completion callback is registered with the transaction. The page will stay in writeback until the dmu runs the completion callback indicating the page is on stable storage. At this point the page can be safely marked clean. This process is normally entirely asynchronous and will be repeated for every dirty page. This may initially sound inefficient but most of these pages will end up in a few txgs. That means when they are eventually written to disk they should be nicely batched. However, there is room for improvement. It may still be desirable to batch up the pages in to larger writes for the dmu. This would reduce the number of callbacks and small 4k buffer required by the ARC. Finally, if the caller requires that the I/O be done synchronously by setting WB_SYNC_ALL or if ZFS_SYNC_ALWAYS is set. Then the I/O will trigger a zil_commit() to flush the data to stable storage. At which point the registered callbacks will be run leaving the date safe of disk and marked clean before returning from .writepage. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov>
2011-08-02 04:28:51 +00:00
struct address_space *mapping = data;
fstrans_cookie_t cookie;
Cleanup mmap(2) writes While the existing implementation of .writepage()/zpl_putpage() was functional it was not entirely correct. In particular, it would move dirty pages in to a clean state simply after copying them in to the ARC cache. This would result in the pages being lost if the system were to crash enough though the Linux VFS believed them to be safe on stable storage. Since at the moment virtually all I/O, except mmap(2), bypasses the page cache this isn't as bad as it sounds. However, as hopefully start using the page cache more getting this right becomes more important so it's good to improve this now. This patch takes a big step in that direction by updating the code to correctly move dirty pages through a writeback phase before they are marked clean. When a dirty page is copied in to the ARC it will now be set in writeback and a completion callback is registered with the transaction. The page will stay in writeback until the dmu runs the completion callback indicating the page is on stable storage. At this point the page can be safely marked clean. This process is normally entirely asynchronous and will be repeated for every dirty page. This may initially sound inefficient but most of these pages will end up in a few txgs. That means when they are eventually written to disk they should be nicely batched. However, there is room for improvement. It may still be desirable to batch up the pages in to larger writes for the dmu. This would reduce the number of callbacks and small 4k buffer required by the ARC. Finally, if the caller requires that the I/O be done synchronously by setting WB_SYNC_ALL or if ZFS_SYNC_ALWAYS is set. Then the I/O will trigger a zil_commit() to flush the data to stable storage. At which point the registered callbacks will be run leaving the date safe of disk and marked clean before returning from .writepage. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov>
2011-08-02 04:28:51 +00:00
ASSERT(PageLocked(pp));
ASSERT(!PageWriteback(pp));
cookie = spl_fstrans_mark();
(void) zfs_putpage(mapping->host, pp, wbc);
spl_fstrans_unmark(cookie);
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
Cleanup mmap(2) writes While the existing implementation of .writepage()/zpl_putpage() was functional it was not entirely correct. In particular, it would move dirty pages in to a clean state simply after copying them in to the ARC cache. This would result in the pages being lost if the system were to crash enough though the Linux VFS believed them to be safe on stable storage. Since at the moment virtually all I/O, except mmap(2), bypasses the page cache this isn't as bad as it sounds. However, as hopefully start using the page cache more getting this right becomes more important so it's good to improve this now. This patch takes a big step in that direction by updating the code to correctly move dirty pages through a writeback phase before they are marked clean. When a dirty page is copied in to the ARC it will now be set in writeback and a completion callback is registered with the transaction. The page will stay in writeback until the dmu runs the completion callback indicating the page is on stable storage. At this point the page can be safely marked clean. This process is normally entirely asynchronous and will be repeated for every dirty page. This may initially sound inefficient but most of these pages will end up in a few txgs. That means when they are eventually written to disk they should be nicely batched. However, there is room for improvement. It may still be desirable to batch up the pages in to larger writes for the dmu. This would reduce the number of callbacks and small 4k buffer required by the ARC. Finally, if the caller requires that the I/O be done synchronously by setting WB_SYNC_ALL or if ZFS_SYNC_ALWAYS is set. Then the I/O will trigger a zil_commit() to flush the data to stable storage. At which point the registered callbacks will be run leaving the date safe of disk and marked clean before returning from .writepage. Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov>
2011-08-02 04:28:51 +00:00
return (0);
}
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
static int
zpl_writepages(struct address_space *mapping, struct writeback_control *wbc)
{
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
znode_t *zp = ITOZ(mapping->host);
zfsvfs_t *zfsvfs = ITOZSB(mapping->host);
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
enum writeback_sync_modes sync_mode;
int result;
ZFS_ENTER(zfsvfs);
if (zfsvfs->z_os->os_sync == ZFS_SYNC_ALWAYS)
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
wbc->sync_mode = WB_SYNC_ALL;
ZFS_EXIT(zfsvfs);
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
sync_mode = wbc->sync_mode;
/*
* We don't want to run write_cache_pages() in SYNC mode here, because
* that would make putpage() wait for a single page to be committed to
* disk every single time, resulting in atrocious performance. Instead
* we run it once in non-SYNC mode so that the ZIL gets all the data,
* and then we commit it all in one go.
*/
wbc->sync_mode = WB_SYNC_NONE;
result = write_cache_pages(mapping, wbc, zpl_putpage, mapping);
if (sync_mode != wbc->sync_mode) {
ZFS_ENTER(zfsvfs);
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
ZFS_VERIFY_ZP(zp);
if (zfsvfs->z_log != NULL)
zil_commit(zfsvfs->z_log, zp->z_id);
ZFS_EXIT(zfsvfs);
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
/*
* We need to call write_cache_pages() again (we can't just
* return after the commit) because the previous call in
* non-SYNC mode does not guarantee that we got all the dirty
* pages (see the implementation of write_cache_pages() for
* details). That being said, this is a no-op in most cases.
*/
wbc->sync_mode = sync_mode;
result = write_cache_pages(mapping, wbc, zpl_putpage, mapping);
}
return (result);
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
}
/*
* Write out dirty pages to the ARC, this function is only required to
* support mmap(2). Mapped pages may be dirtied by memory operations
* which never call .write(). These dirty pages are kept in sync with
* the ARC buffers via this hook.
*/
static int
zpl_writepage(struct page *pp, struct writeback_control *wbc)
{
Only commit the ZIL once in zpl_writepages() (msync() case). Currently, using msync() results in the following code path: sys_msync -> zpl_fsync -> filemap_write_and_wait_range -> zpl_writepages -> write_cache_pages -> zpl_putpage In such a code path, zil_commit() is called as part of zpl_putpage(). This means that for each page, the write is handed to the DMU, the ZIL is committed, and only then do we move on to the next page. As one might imagine, this results in atrocious performance where there is a large number of pages to write: instead of committing a batch of N writes, we do N commits containing one page each. In some extreme cases this can result in msync() being ~700 times slower than it should be, as well as very inefficient use of ZIL resources. This patch fixes this issue by making sure that the requested writes are batched and then committed only once. Unfortunately, the implementation is somewhat non-trivial because there is no way to run write_cache_pages in SYNC mode (so that we get all pages) without making it wait on the writeback tag for each page. The solution implemented here is composed of two parts: - I added a new callback system to the ZIL, which allows the caller to be notified when its ITX gets written to stable storage. One nice thing is that the callback is called not only in zil_commit() but in zil_sync() as well, which means that the caller doesn't have to care whether the write ended up in the ZIL or the DMU: it will get notified as soon as it's safe, period. This is an improvement over dmu_tx_callback_register() that was used previously, which only supports DMU writes. The rationale for this change is to allow zpl_putpage() to be notified when a ZIL commit is completed without having to block on zil_commit() itself. - zpl_writepages() now calls write_cache_pages in non-SYNC mode, which will prevent (1) write_cache_pages from blocking, and (2) zpl_putpage from issuing ZIL commits. zpl_writepages() will issue the commit itself instead of relying on zpl_putpage() to do it, thus nicely batching the writes. Note, however, that we still have to call write_cache_pages() again in SYNC mode because there is an edge case documented in the implementation of write_cache_pages() whereas it will not give us all dirty pages when running in non-SYNC mode. Thus we need to run it at least once in SYNC mode to make sure we honor persistency guarantees. This only happens when the pages are modified at the same time msync() is running, which should be rare. In most cases there won't be any additional pages and this second call will do nothing. Note that this change also fixes a bug related to #907 whereas calling msync() on pages that were already handed over to the DMU in a previous writepages() call would make msync() block until the next TXG sync instead of returning as soon as the ZIL commit is complete. The new callback system fixes that problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #1849 Closes #907
2013-11-10 15:00:11 +00:00
if (ITOZSB(pp->mapping->host)->z_os->os_sync == ZFS_SYNC_ALWAYS)
wbc->sync_mode = WB_SYNC_ALL;
return (zpl_putpage(pp, wbc, pp->mapping));
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
}
/*
* The only flag combination which matches the behavior of zfs_space()
* is FALLOC_FL_KEEP_SIZE | FALLOC_FL_PUNCH_HOLE. The FALLOC_FL_PUNCH_HOLE
* flag was introduced in the 2.6.38 kernel.
*/
#if defined(HAVE_FILE_FALLOCATE) || defined(HAVE_INODE_FALLOCATE)
long
zpl_fallocate_common(struct inode *ip, int mode, loff_t offset, loff_t len)
{
int error = -EOPNOTSUPP;
#if defined(FALLOC_FL_PUNCH_HOLE) && defined(FALLOC_FL_KEEP_SIZE)
cred_t *cr = CRED();
flock64_t bf;
loff_t olen;
fstrans_cookie_t cookie;
if (mode != (FALLOC_FL_KEEP_SIZE | FALLOC_FL_PUNCH_HOLE))
return (error);
if (offset < 0 || len <= 0)
return (-EINVAL);
spl_inode_lock(ip);
olen = i_size_read(ip);
if (offset > olen) {
spl_inode_unlock(ip);
return (0);
}
if (offset + len > olen)
len = olen - offset;
bf.l_type = F_WRLCK;
bf.l_whence = 0;
bf.l_start = offset;
bf.l_len = len;
bf.l_pid = 0;
crhold(cr);
cookie = spl_fstrans_mark();
error = -zfs_space(ip, F_FREESP, &bf, FWRITE, offset, cr);
spl_fstrans_unmark(cookie);
spl_inode_unlock(ip);
crfree(cr);
#endif /* defined(FALLOC_FL_PUNCH_HOLE) && defined(FALLOC_FL_KEEP_SIZE) */
ASSERT3S(error, <=, 0);
return (error);
}
#endif /* defined(HAVE_FILE_FALLOCATE) || defined(HAVE_INODE_FALLOCATE) */
#ifdef HAVE_FILE_FALLOCATE
static long
zpl_fallocate(struct file *filp, int mode, loff_t offset, loff_t len)
{
return zpl_fallocate_common(file_inode(filp),
mode, offset, len);
}
#endif /* HAVE_FILE_FALLOCATE */
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
#define ZFS_FL_USER_VISIBLE (FS_FL_USER_VISIBLE | ZFS_PROJINHERIT_FL)
#define ZFS_FL_USER_MODIFIABLE (FS_FL_USER_MODIFIABLE | ZFS_PROJINHERIT_FL)
static uint32_t
__zpl_ioctl_getflags(struct inode *ip)
{
uint64_t zfs_flags = ITOZ(ip)->z_pflags;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
uint32_t ioctl_flags = 0;
if (zfs_flags & ZFS_IMMUTABLE)
ioctl_flags |= FS_IMMUTABLE_FL;
if (zfs_flags & ZFS_APPENDONLY)
ioctl_flags |= FS_APPEND_FL;
if (zfs_flags & ZFS_NODUMP)
ioctl_flags |= FS_NODUMP_FL;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
if (zfs_flags & ZFS_PROJINHERIT)
ioctl_flags |= ZFS_PROJINHERIT_FL;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
return (ioctl_flags & ZFS_FL_USER_VISIBLE);
}
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
/*
* Map zfs file z_pflags (xvattr_t) to linux file attributes. Only file
* attributes common to both Linux and Solaris are mapped.
*/
static int
zpl_ioctl_getflags(struct file *filp, void __user *arg)
{
uint32_t flags;
int err;
flags = __zpl_ioctl_getflags(file_inode(filp));
err = copy_to_user(arg, &flags, sizeof (flags));
return (err);
}
/*
* fchange() is a helper macro to detect if we have been asked to change a
* flag. This is ugly, but the requirement that we do this is a consequence of
* how the Linux file attribute interface was designed. Another consequence is
* that concurrent modification of files suffers from a TOCTOU race. Neither
* are things we can fix without modifying the kernel-userland interface, which
* is outside of our jurisdiction.
*/
#define fchange(f0, f1, b0, b1) (!((f0) & (b0)) != !((f1) & (b1)))
static int
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
__zpl_ioctl_setflags(struct inode *ip, uint32_t ioctl_flags, xvattr_t *xva)
{
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
uint64_t zfs_flags = ITOZ(ip)->z_pflags;
xoptattr_t *xoap;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
if (ioctl_flags & ~(FS_IMMUTABLE_FL | FS_APPEND_FL | FS_NODUMP_FL |
ZFS_PROJINHERIT_FL))
return (-EOPNOTSUPP);
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
if (ioctl_flags & ~ZFS_FL_USER_MODIFIABLE)
return (-EACCES);
if ((fchange(ioctl_flags, zfs_flags, FS_IMMUTABLE_FL, ZFS_IMMUTABLE) ||
fchange(ioctl_flags, zfs_flags, FS_APPEND_FL, ZFS_APPENDONLY)) &&
!capable(CAP_LINUX_IMMUTABLE))
return (-EACCES);
if (!zpl_inode_owner_or_capable(ip))
return (-EACCES);
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
xva_init(xva);
xoap = xva_getxoptattr(xva);
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
XVA_SET_REQ(xva, XAT_IMMUTABLE);
if (ioctl_flags & FS_IMMUTABLE_FL)
xoap->xoa_immutable = B_TRUE;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
XVA_SET_REQ(xva, XAT_APPENDONLY);
if (ioctl_flags & FS_APPEND_FL)
xoap->xoa_appendonly = B_TRUE;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
XVA_SET_REQ(xva, XAT_NODUMP);
if (ioctl_flags & FS_NODUMP_FL)
xoap->xoa_nodump = B_TRUE;
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
XVA_SET_REQ(xva, XAT_PROJINHERIT);
if (ioctl_flags & ZFS_PROJINHERIT_FL)
xoap->xoa_projinherit = B_TRUE;
return (0);
}
static int
zpl_ioctl_setflags(struct file *filp, void __user *arg)
{
struct inode *ip = file_inode(filp);
uint32_t flags;
cred_t *cr = CRED();
xvattr_t xva;
int err;
fstrans_cookie_t cookie;
if (copy_from_user(&flags, arg, sizeof (flags)))
return (-EFAULT);
err = __zpl_ioctl_setflags(ip, flags, &xva);
if (err)
return (err);
crhold(cr);
cookie = spl_fstrans_mark();
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
err = -zfs_setattr(ip, (vattr_t *)&xva, 0, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
return (err);
}
static int
zpl_ioctl_getxattr(struct file *filp, void __user *arg)
{
zfsxattr_t fsx = { 0 };
struct inode *ip = file_inode(filp);
int err;
fsx.fsx_xflags = __zpl_ioctl_getflags(ip);
fsx.fsx_projid = ITOZ(ip)->z_projid;
err = copy_to_user(arg, &fsx, sizeof (fsx));
return (err);
}
static int
zpl_ioctl_setxattr(struct file *filp, void __user *arg)
{
struct inode *ip = file_inode(filp);
zfsxattr_t fsx;
cred_t *cr = CRED();
xvattr_t xva;
xoptattr_t *xoap;
int err;
fstrans_cookie_t cookie;
if (copy_from_user(&fsx, arg, sizeof (fsx)))
return (-EFAULT);
if (!zpl_is_valid_projid(fsx.fsx_projid))
return (-EINVAL);
err = __zpl_ioctl_setflags(ip, fsx.fsx_xflags, &xva);
if (err)
return (err);
xoap = xva_getxoptattr(&xva);
XVA_SET_REQ(&xva, XAT_PROJID);
xoap->xoa_projid = fsx.fsx_projid;
crhold(cr);
cookie = spl_fstrans_mark();
err = -zfs_setattr(ip, (vattr_t *)&xva, 0, cr);
spl_fstrans_unmark(cookie);
crfree(cr);
return (err);
}
static long
zpl_ioctl(struct file *filp, unsigned int cmd, unsigned long arg)
{
switch (cmd) {
case FS_IOC_GETFLAGS:
return (zpl_ioctl_getflags(filp, (void *)arg));
case FS_IOC_SETFLAGS:
return (zpl_ioctl_setflags(filp, (void *)arg));
Project Quota on ZFS Project quota is a new ZFS system space/object usage accounting and enforcement mechanism. Similar as user/group quota, project quota is another dimension of system quota. It bases on the new object attribute - project ID. Project ID is a numerical value to indicate to which project an object belongs. An object only can belong to one project though you (the object owner or privileged user) can change the object project ID via 'chattr -p' or 'zfs project [-s] -p' explicitly. The object also can inherit the project ID from its parent when created if the parent has the project inherit flag (that can be set via 'chattr +P' or 'zfs project -s [-p]'). By accounting the spaces/objects belong to the same project, we can know how many spaces/objects used by the project. And if we set the upper limit then we can control the spaces/objects that are consumed by such project. It is useful when multiple groups and users cooperate for the same project, or a user/group needs to participate in multiple projects. Support the following commands and functionalities: zfs set projectquota@project zfs set projectobjquota@project zfs get projectquota@project zfs get projectobjquota@project zfs get projectused@project zfs get projectobjused@project zfs projectspace zfs allow projectquota zfs allow projectobjquota zfs allow projectused zfs allow projectobjused zfs unallow projectquota zfs unallow projectobjquota zfs unallow projectused zfs unallow projectobjused chattr +/-P chattr -p project_id lsattr -p This patch also supports tree quota based on the project quota via "zfs project" commands set as following: zfs project [-d|-r] <file|directory ...> zfs project -C [-k] [-r] <file|directory ...> zfs project -c [-0] [-d|-r] [-p id] <file|directory ...> zfs project [-p id] [-r] [-s] <file|directory ...> For "df [-i] $DIR" command, if we set INHERIT (project ID) flag on the $DIR, then the proejct [obj]quota and [obj]used values for the $DIR's project ID will be shown as the total/free (avail) resource. Keep the same behavior as EXT4/XFS does. Reviewed-by: Andreas Dilger <andreas.dilger@intel.com> Reviewed-by Ned Bass <bass6@llnl.gov> Reviewed-by: Matthew Ahrens <mahrens@delphix.com> Reviewed-by: Brian Behlendorf <behlendorf1@llnl.gov> Signed-off-by: Fan Yong <fan.yong@intel.com> TEST_ZIMPORT_POOLS="zol-0.6.1 zol-0.6.2 master" Change-Id: Ib4f0544602e03fb61fd46a849d7ba51a6005693c Closes #6290
2018-02-13 22:54:54 +00:00
case ZFS_IOC_FSGETXATTR:
return (zpl_ioctl_getxattr(filp, (void *)arg));
case ZFS_IOC_FSSETXATTR:
return (zpl_ioctl_setxattr(filp, (void *)arg));
default:
return (-ENOTTY);
}
}
#ifdef CONFIG_COMPAT
static long
zpl_compat_ioctl(struct file *filp, unsigned int cmd, unsigned long arg)
{
switch (cmd) {
case FS_IOC32_GETFLAGS:
cmd = FS_IOC_GETFLAGS;
break;
case FS_IOC32_SETFLAGS:
cmd = FS_IOC_SETFLAGS;
break;
default:
return (-ENOTTY);
}
return (zpl_ioctl(filp, cmd, (unsigned long)compat_ptr(arg)));
}
#endif /* CONFIG_COMPAT */
const struct address_space_operations zpl_address_space_operations = {
.readpages = zpl_readpages,
.readpage = zpl_readpage,
.writepage = zpl_writepage,
.writepages = zpl_writepages,
Direct IO support Direct IO via the O_DIRECT flag was originally introduced in XFS by IRIX for database workloads. Its purpose was to allow the database to bypass the page and buffer caches to prevent unnecessary IO operations (e.g. readahead) while preventing contention for system memory between the database and kernel caches. On Illumos, there is a library function called directio(3C) that allows user space to provide a hint to the file system that Direct IO is useful, but the file system is free to ignore it. The semantics are also entirely a file system decision. Those that do not implement it return ENOTTY. Since the semantics were never defined in any standard, O_DIRECT is implemented such that it conforms to the behavior described in the Linux open(2) man page as follows. 1. Minimize cache effects of the I/O. By design the ARC is already scan-resistant which helps mitigate the need for special O_DIRECT handling. Data which is only accessed once will be the first to be evicted from the cache. This behavior is in consistent with Illumos and FreeBSD. Future performance work may wish to investigate the benefits of immediately evicting data from the cache which has been read or written with the O_DIRECT flag. Functionally this behavior is very similar to applying the 'primarycache=metadata' property per open file. 2. O_DIRECT _MAY_ impose restrictions on IO alignment and length. No additional alignment or length restrictions are imposed. 3. O_DIRECT _MAY_ perform unbuffered IO operations directly between user memory and block device. No unbuffered IO operations are currently supported. In order to support features such as transparent compression, encryption, and checksumming a copy must be made to transform the data. 4. O_DIRECT _MAY_ imply O_DSYNC (XFS). O_DIRECT does not imply O_DSYNC for ZFS. Callers must provide O_DSYNC to request synchronous semantics. 5. O_DIRECT _MAY_ disable file locking that serializes IO operations. Applications should avoid mixing O_DIRECT and normal IO or mmap(2) IO to the same file. This is particularly true for overlapping regions. All I/O in ZFS is locked for correctness and this locking is not disabled by O_DIRECT. However, concurrently mixing O_DIRECT, mmap(2), and normal I/O on the same file is not recommended. This change is implemented by layering the aops->direct_IO operations on the existing AIO operations. Code already existed in ZFS on Linux for bypassing the page cache when O_DIRECT is specified. References: * http://xfs.org/docs/xfsdocs-xml-dev/XFS_User_Guide/tmp/en-US/html/ch02s09.html * https://blogs.oracle.com/roch/entry/zfs_and_directio * https://ext4.wiki.kernel.org/index.php/Clarifying_Direct_IO's_Semantics * https://illumos.org/man/3c/directio Reviewed-by: Richard Elling <Richard.Elling@RichardElling.com> Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #224 Closes #7823
2018-08-27 17:04:21 +00:00
.direct_IO = zpl_direct_IO,
};
const struct file_operations zpl_file_operations = {
.open = zpl_open,
.release = zpl_release,
.llseek = zpl_llseek,
#ifdef HAVE_VFS_RW_ITERATE
#ifdef HAVE_NEW_SYNC_READ
.read = new_sync_read,
.write = new_sync_write,
#endif
.read_iter = zpl_iter_read,
.write_iter = zpl_iter_write,
#else
.read = do_sync_read,
.write = do_sync_write,
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
.aio_read = zpl_aio_read,
.aio_write = zpl_aio_write,
#endif
Add mmap(2) support It's worth taking a moment to describe how mmap is implemented for zfs because it differs considerably from other Linux filesystems. However, this issue is handled the same way under OpenSolaris. The issue is that by design zfs bypasses the Linux page cache and leaves all caching up to the ARC. This has been shown to work well for the common read(2)/write(2) case. However, mmap(2) is problem because it relies on being tightly integrated with the page cache. To handle this we cache mmap'ed files twice, once in the ARC and a second time in the page cache. The code is careful to keep both copies synchronized. When a file with an mmap'ed region is written to using write(2) both the data in the ARC and existing pages in the page cache are updated. For a read(2) data will be read first from the page cache then the ARC if needed. Neither a write(2) or read(2) will will ever result in new pages being added to the page cache. New pages are added to the page cache only via .readpage() which is called when the vfs needs to read a page off disk to back the virtual memory region. These pages may be modified without notifying the ARC and will be written out periodically via .writepage(). This will occur due to either a sync or the usual page aging behavior. Note because a read(2) of a mmap'ed file will always check the page cache first even when the ARC is out of date correct data will still be returned. While this implementation ensures correct behavior it does have have some drawbacks. The most obvious of which is that it increases the required memory footprint when access mmap'ed files. It also adds additional complexity to the code keeping both caches synchronized. Longer term it may be possible to cleanly resolve this wart by mapping page cache pages directly on to the ARC buffers. The Linux address space operations are flexible enough to allow selection of which pages back a particular index. The trick would be working out the details of which subsystem is in charge, the ARC, the page cache, or both. It may also prove helpful to move the ARC buffers to a scatter-gather lists rather than a vmalloc'ed region. Additionally, zfs_write/read_common() were used in the readpage and writepage hooks because it was fairly easy. However, it would be better to update zfs_fillpage and zfs_putapage to be Linux friendly and use them instead.
2011-02-03 18:34:05 +00:00
.mmap = zpl_mmap,
.fsync = zpl_fsync,
#ifdef HAVE_FILE_AIO_FSYNC
Linux AIO Support nfsd uses do_readv_writev() to implement fops->read and fops->write. do_readv_writev() will attempt to read/write using fops->aio_read and fops->aio_write, but it will fallback to fops->read and fops->write when AIO is not available. However, the fallback will perform a call for each individual data page. Since our default recordsize is 128KB, sequential operations on NFS will generate 32 DMU transactions where only 1 transaction was needed. That was unnecessary overhead and we implement fops->aio_read and fops->aio_write to eliminate it. ZFS originated in OpenSolaris, where the AIO API is entirely implemented in userland's libc by intelligently mapping them to VOP_WRITE, VOP_READ and VOP_FSYNC. Linux implements AIO inside the kernel itself. Linux filesystems therefore must implement their own AIO logic and nearly all of them implement fops->aio_write synchronously. Consequently, they do not implement aio_fsync(). However, since the ZPL works by mapping Linux's VFS calls to the functions implementing Illumos' VFS operations, we instead implement AIO in the kernel by mapping the operations to the VOP_READ, VOP_WRITE and VOP_FSYNC equivalents. We therefore implement fops->aio_fsync. One might be inclined to make our fops->aio_write implementation synchronous to make software that expects this behavior safe. However, there are several reasons not to do this: 1. Other platforms do not implement aio_write() synchronously and since the majority of userland software using AIO should be cross platform, expectations of synchronous behavior should not be a problem. 2. We would hurt the performance of programs that use POSIX interfaces properly while simultaneously encouraging the creation of more non-compliant software. 3. The broader community concluded that userland software should be patched to properly use POSIX interfaces instead of implementing hacks in filesystems to cater to broken software. This concept is best described as the O_PONIES debate. 4. Making an asynchronous write synchronous is non sequitur. Any software dependent on synchronous aio_write behavior will suffer data loss on ZFSOnLinux in a kernel panic / system failure of at most zfs_txg_timeout seconds, which by default is 5 seconds. This seems like a reasonable consequence of using non-compliant software. It should be noted that this is also a problem in the kernel itself where nfsd does not pass O_SYNC on files opened with it and instead relies on a open()/write()/close() to enforce synchronous behavior when the flush is only guarenteed on last close. Exporting any filesystem that does not implement AIO via NFS risks data loss in the event of a kernel panic / system failure when something else is also accessing the file. Exporting any file system that implements AIO the way this patch does bears similar risk. However, it seems reasonable to forgo crippling our AIO implementation in favor of developing patches to fix this problem in Linux's nfsd for the reasons stated earlier. In the interim, the risk will remain. Failing to implement AIO will not change the problem that nfsd created, so there is no reason for nfsd's mistake to block our implementation of AIO. It also should be noted that `aio_cancel()` will always return `AIO_NOTCANCELED` under this implementation. It is possible to implement aio_cancel by deferring work to taskqs and use `kiocb_set_cancel_fn()` to set a callback function for cancelling work sent to taskqs, but the simpler approach is allowed by the specification: ``` Which operations are cancelable is implementation-defined. ``` http://pubs.opengroup.org/onlinepubs/009695399/functions/aio_cancel.html The only programs on my system that are capable of using `aio_cancel()` are QEMU, beecrypt and fio use it according to a recursive grep of my system's `/usr/src/debug`. That suggests that `aio_cancel()` users are rare. Implementing aio_cancel() is left to a future date when it is clear that there are consumers that benefit from its implementation to justify the work. Lastly, it is important to know that handling of the iovec updates differs between Illumos and Linux in the implementation of read/write. On Linux, it is the VFS' responsibility whle on Illumos, it is the filesystem's responsibility. We take the intermediate solution of copying the iovec so that the ZFS code can update it like on Solaris while leaving the originals alone. This imposes some overhead. We could always revisit this should profiling show that the allocations are a problem. Signed-off-by: Richard Yao <ryao@gentoo.org> Signed-off-by: Brian Behlendorf <behlendorf1@llnl.gov> Closes #223 Closes #2373
2014-08-04 11:09:32 +00:00
.aio_fsync = zpl_aio_fsync,
#endif
#ifdef HAVE_FILE_FALLOCATE
.fallocate = zpl_fallocate,
#endif /* HAVE_FILE_FALLOCATE */
.unlocked_ioctl = zpl_ioctl,
#ifdef CONFIG_COMPAT
.compat_ioctl = zpl_compat_ioctl,
#endif
};
const struct file_operations zpl_dir_file_operations = {
.llseek = generic_file_llseek,
.read = generic_read_dir,
#if defined(HAVE_VFS_ITERATE_SHARED)
.iterate_shared = zpl_iterate,
#elif defined(HAVE_VFS_ITERATE)
.iterate = zpl_iterate,
#else
.readdir = zpl_readdir,
#endif
.fsync = zpl_fsync,
.unlocked_ioctl = zpl_ioctl,
#ifdef CONFIG_COMPAT
.compat_ioctl = zpl_compat_ioctl,
#endif
};