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- 08 11月, 2012 5 次提交
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由 Eric Sandeen 提交于
When xfs gained the projid32bit feature, it was never added to the FSGEOMETRY ioctl feature flags, so it's not queryable without this patch. Signed-off-by: NEric Sandeen <sandeen@redhat.com> Reviewed-by: NCarlos Maiolino <cmaiolino@redhat.com> Reviewed-by: NDave Chinner <dchinner@redhat.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Commit 44396476 ("xfs: reset buffer pointers before freeing them") in 3.0-rc1 introduced a regression when recovering log buffers that wrapped around the end of log. The second part of the log buffer at the start of the physical log was being read into the header buffer rather than the data buffer, and hence recovery was seeing garbage in the data buffer when it got to the region of the log buffer that was incorrectly read. Cc: <stable@vger.kernel.org> # 3.0.x, 3.2.x, 3.4.x 3.6.x Reported-by: NTorsten Kaiser <just.for.lkml@googlemail.com> Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
When we shut down the filesystem, we have to unpin and free all the buffers currently active in the CIL. To do this we unpin and remove them in one operation as a result of a failed iclogbuf write. For buffers, we do this removal via a simultated IO completion of after marking the buffer stale. At the time we do this, we have two references to the buffer - the active LRU reference and the buf log item. The LRU reference is removed by marking the buffer stale, and the active CIL reference is by the xfs_buf_iodone() callback that is run by xfs_buf_do_callbacks() during ioend processing (via the bp->b_iodone callback). However, ioend processing requires one more reference - that of the IO that it is completing. We don't have this reference, so we free the buffer prematurely and use it after it is freed. For buffers marked with XBF_ASYNC, this leads to assert failures in xfs_buf_rele() on debug kernels because the b_hold count is zero. Fix this by making sure we take the necessary IO reference before starting IO completion processing on the stale buffer, and set the XBF_ASYNC flag to ensure that IO completion processing removes all the active references from the buffer to ensure it is fully torn down. Cc: <stable@vger.kernel.org> Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Inode buffers do not need to be mapped as inodes are read or written directly from/to the pages underlying the buffer. This fixes a regression introduced by commit 611c9946 ("xfs: make XBF_MAPPED the default behaviour"). Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
When we free a block from the alloc btree tree, we move it to the freelist held in the AGFL and mark it busy in the busy extent tree. This typically happens when we merge btree blocks. Once the transaction is committed and checkpointed, the block can remain on the free list for an indefinite amount of time. Now, this isn't the end of the world at this point - if the free list is shortened, the buffer is invalidated in the transaction that moves it back to free space. If the buffer is allocated as metadata from the free list, then all the modifications getted logged, and we have no issues, either. And if it gets allocated as userdata direct from the freelist, it gets invalidated and so will never get written. However, during the time it sits on the free list, pressure on the log can cause the AIL to be pushed and the buffer that covers the block gets pushed for write. IOWs, we end up writing a freed metadata block to disk. Again, this isn't the end of the world because we know from the above we are only writing to free space. The problem, however, is for validation callbacks. If the block was on old btree root block, then the level of the block is going to be higher than the current tree root, and so will fail validation. There may be other inconsistencies in the block as well, and currently we don't care because the block is in free space. Shutting down the filesystem because a freed block doesn't pass write validation, OTOH, is rather unfriendly. So, make sure we always invalidate buffers as they move from the free space trees to the free list so that we guarantee they never get written to disk while on the free list. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NPhil White <pwhite@sgi.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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- 03 11月, 2012 3 次提交
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由 Carlos Maiolino 提交于
I found some out of date comments while studying the inode allocation code, so I believe it's worth to have these comments updated. It basically rewrites the comment regarding to "call_again" variable, which is not used anymore, but instead, callers of xfs_ialloc() decides if it needs to be called again relying only if ialloc_context is NULL or not. Also did some small changes in another comment that I thought to be pertinent to the current behaviour of these functions and some alignment on both comments. Signed-off-by: NCarlos Maiolino <cmaiolino@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Uninitialised variable build warning introduced by 2903ff01 ("switch simple cases of fget_light to fdget"), gcc is not smart enough to work out that the variable is not used uninitialised, and the commit removed the initialisation at declaration that the old variable had. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
When updating new secondary superblocks in a growfs operation, the superblock buffer is read from the newly grown region of the underlying device. This is not guaranteed to be zero, so violates the underlying assumption that the unused parts of superblocks are zero filled. Get a new buffer for these secondary superblocks to ensure that the unused regions are zero filled correctly. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NCarlos Maiolino <cmaiolino@redhat.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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- 19 10月, 2012 3 次提交
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由 Dave Chinner 提交于
Switching stacks are xfs_alloc_vextent can cause deadlocks when we run out of worker threads on the allocation workqueue. This can occur because xfs_bmap_btalloc can make multiple calls to xfs_alloc_vextent() and even if xfs_alloc_vextent() fails it can return with the AGF locked in the current allocation transaction. If we then need to make another allocation, and all the allocation worker contexts are exhausted because the are blocked waiting for the AGF lock, holder of the AGF cannot get it's xfs-alloc_vextent work completed to release the AGF. Hence allocation effectively deadlocks. To avoid this, move the stack switch one layer up to xfs_bmapi_allocate() so that all of the allocation attempts in a single switched stack transaction occur in a single worker context. This avoids the problem of an allocation being blocked waiting for a worker thread whilst holding the AGF. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Certain allocation paths through xfs_bmapi_write() are in situations where we have limited stack available. These are almost always in the buffered IO writeback path when convertion delayed allocation extents to real extents. The current stack switch occurs for userdata allocations, which means we also do stack switches for preallocation, direct IO and unwritten extent conversion, even those these call chains have never been implicated in a stack overrun. Hence, let's target just the single stack overun offended for stack switches. To do that, introduce a XFS_BMAPI_STACK_SWITCH flag that the caller can pass xfs_bmapi_write() to indicate it should switch stacks if it needs to do allocation. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Mark Tinguely 提交于
Zero the kernel stack space that makes up the xfs_alloc_arg structures. Signed-off-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NBen Myers <bpm@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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- 18 10月, 2012 14 次提交
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由 Dave Chinner 提交于
The log write code stamps each iclog with the current tail LSN in the iclog header so that recovery knows where to find the tail of thelog once it has found the head. Normally this is taken from the first item on the AIL - the log item that corresponds to the oldest active item in the log. The problem is that when the AIL is empty, the tail lsn is dervied from the the l_last_sync_lsn, which is the LSN of the last iclog to be written to the log. In most cases this doesn't happen, because the AIL is rarely empty on an active filesystem. However, when it does, it opens up an interesting case when the transaction being committed to the iclog spans multiple iclogs. That is, the first iclog is stamped with the l_last_sync_lsn, and IO is issued. Then the next iclog is setup, the changes copied into the iclog (takes some time), and then the l_last_sync_lsn is stamped into the header and IO is issued. This is still the same transaction, so the tail lsn of both iclogs must be the same for log recovery to find the entire transaction to be able to replay it. The problem arises in that the iclog buffer IO completion updates the l_last_sync_lsn with it's own LSN. Therefore, If the first iclog completes it's IO before the second iclog is filled and has the tail lsn stamped in it, it will stamp the LSN of the first iclog into it's tail lsn field. If the system fails at this point, log recovery will not see a complete transaction, so the transaction will no be replayed. The fix is simple - the l_last_sync_lsn is updated when a iclog buffer IO completes, and this is incorrect. The l_last_sync_lsn shoul dbe updated when a transaction is completed by a iclog buffer IO. That is, only iclog buffers that have transaction commit callbacks attached to them should update the l_last_sync_lsn. This means that the last_sync_lsn will only move forward when a commit record it written, not in the middle of a large transaction that is rolling through multiple iclog buffers. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
The inode cache functions remaining in xfs_iget.c can be moved to xfs_icache.c along with the other inode cache functions. This removes all functionality from xfs_iget.c, so the file can simply be removed. This move results in various functions now only having the scope of a single file (e.g. xfs_inode_free()), so clean up all the definitions and exported prototypes in xfs_icache.[ch] and xfs_inode.h appropriately. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
xfs_ilock() and friends really aren't related to the inode cache in any way, so move them to xfs_inode.c with all the other inode related functionality. While doing this move, move the xfs_ilock() tracepoints to *before* the lock is taken so that when a hang on a lock occurs we have events to indicate which process and what inode we were trying to lock when the hang occurred. This is much better than the current silence we get on a hang... Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
xfs_sync.c now only contains inode reclaim functions and inode cache iteration functions. It is not related to sync operations anymore. Rename to xfs_icache.c to reflect it's contents and prepare for consolidation with the other inode cache file that exists (xfs_iget.c). Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
xfs_quiesce_attr() is supposed to leave the log empty with an unmount record written. Right now it does not wait for the AIL to be emptied before writing the unmount record, not does it wait for metadata IO completion, either. Fix it to use the same method and code as xfs_log_unmount(). Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Both callers of xfs_quiesce_attr() are in xfs_super.c, and there's nothing really sync-specific about this functionality so it doesn't really matter where it lives. Move it to benext to it's callers, so all the remount/sync_fs code is in the one place. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Why do we need to write the superblock to disk once we've written all the data? We don't actually - the reasons for doing this are lost in the mists of time, and go back to the way Irix used to drive VFS flushing. On linux, this code is only called from two contexts: remount and .sync_fs. In the remount case, the call is followed by a metadata sync, which unpins and writes the superblock. In the sync_fs case, we only need to force the log to disk to ensure that the superblock is correctly on disk, so we don't actually need to write it. Hence the functionality is either redundant or superfluous and thus can be removed. Seeing as xfs_quiesce_data is essentially now just a log force, remove it as well and fold the code back into the two callers. Neither of them need the log covering check, either, as that is redundant for the remount case, and unnecessary for the .sync_fs case. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
With the syncd functions moved to the log and/or removed, the syncd workqueue is the only remaining bit left. It is used by the log covering/ail pushing work, as well as by the inode reclaim work. Given how cheap workqueues are these days, give the log and inode reclaim work their own work queues and kill the syncd work queue. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
We don't do any data writeback from XFS any more - the VFS is completely responsible for that, including for freeze. We can replace the remaining caller with a VFS level function that achieves the same thing, but without conflicting with current writeback work. This means we can remove the flush_work and xfs_flush_inodes() - the VFS functionality completely replaces the internal flush queue for doing this writeback work in a separate context to avoid stack overruns. This does have one complication - it cannot be called with page locks held. Hence move the flushing of delalloc space when ENOSPC occurs back up into xfs_file_aio_buffered_write when we don't hold any locks that will stall writeback. Unfortunately, writeback_inodes_sb_if_idle() is not sufficient to trigger delalloc conversion fast enough to prevent spurious ENOSPC whent here are hundreds of writers, thousands of small files and GBs of free RAM. Hence we need to use sync_sb_inodes() to block callers while we wait for writeback like the previous xfs_flush_inodes implementation did. That means we have to hold the s_umount lock here, but because this call can nest inside i_mutex (the parent directory in the create case, held by the VFS), we have to use down_read_trylock() to avoid potential deadlocks. In practice, this trylock will succeed on almost every attempt as unmount/remount type operations are exceedingly rare. Note: we always need to pass a count of zero to generic_file_buffered_write() as the previously written byte count. We only do this by accident before this patch by the virtue of ret always being zero when there are no errors. Make this explicit rather than needing to specifically zero ret in the ENOSPC retry case. Signed-off-by: NDave Chinner <dchinner@redhat.com> Tested-by: NBrian Foster <bfoster@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
When unmounting the filesystem, there are lots of operations that need to be done in a specific order, and they are spread across across a couple of functions. We have to drain the AIL before we write the unmount record, and we have to shut down the background log work before we do either of them. But this is all split haphazardly across xfs_unmountfs() and xfs_log_unmount(). Move all the AIL flushing and log manipulations to xfs_log_unmount() so that the responisbilities of each function is clear and the operations they perform obvious. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
The only thing the periodic sync work does now is flush the AIL and idle the log. These are really functions of the log code, so move the work to xfs_log.c and rename it appropriately. The only wart that this leaves behind is the xfssyncd_centisecs sysctl, otherwise the xfssyncd is dead. Clean up any comments that related to xfssyncd to reflect it's passing. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
If the filesystem is mounted or remounted read-only, stop the sync worker that tries to flush or cover the log if the filesystem is dirty. It's read-only, so it isn't dirty. Restart it on a remount,rw as necessary. This avoids the need for RO checks in the work. Similarly, stop the sync work when the filesystem is frozen, and start it again when the filesysetm is thawed. This avoids the need for special freeze checks in the work. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
Instead of starting and stopping background work on the xfs_mount_wq all at the same time, separate them to where they really are needed to start and stop. The xfs_sync_worker, only needs to be started after all the mount processing has completed successfully, while it needs to be stopped before the log is unmounted. The xfs_reclaim_worker is started on demand, and can be stopped before the unmount process does it's own inode reclaim pass. The xfs_flush_inodes work is run on demand, and so we really only need to ensure that it has stopped running before we start processing an unmount, freeze or remount,ro. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Signed-off-by: NBen Myers <bpm@sgi.com>
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由 Dave Chinner 提交于
xfs_syncd_start and xfs_syncd_stop tie a bunch of unrelated functionailty together that actually have different start and stop requirements. Kill these functions and open code the start/stop methods for each of the background functions. Subsequent patches will move the start/stop functions around to the correct places to avoid races and shutdown issues. Signed-off-by: NDave Chinner <dchinner@redhat.com> Reviewed-by: NChristoph Hellwig <hch@lst.de> Reviewed-by: NMark Tinguely <tinguely@sgi.com> Signed-off-by: NBen Myers <bpm@sgi.com>
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- 13 10月, 2012 9 次提交
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由 Jeff Layton 提交于
Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
In the common case where a name is much smaller than PATH_MAX, an extra allocation for struct filename is unnecessary. Before allocating a separate one, try to embed the struct filename inside the buffer first. If it turns out that that's not long enough, then fall back to allocating a separate struct filename and redoing the copy. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
Keep a pointer to the audit_names "slot" in struct filename. Have all of the audit_inode callers pass a struct filename ponter to audit_inode instead of a string pointer. If the aname field is already populated, then we can skip walking the list altogether and just use it directly. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
...and fix up the callers. For do_file_open_root, just declare a struct filename on the stack and fill out the .name field. For do_filp_open, make it also take a struct filename pointer, and fix up its callers to call it appropriately. For filp_open, add a variant that takes a struct filename pointer and turn filp_open into a wrapper around it. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
...and make the user_path callers use that variant instead. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
Currently, if we call getname() on a userland string more than once, we'll get multiple copies of the string and multiple audit_names records. Add a function that will allow the audit_names code to satisfy getname requests using info from the audit_names list, avoiding a new allocation and audit_names records. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
getname() is intended to copy pathname strings from userspace into a kernel buffer. The result is just a string in kernel space. It would however be quite helpful to be able to attach some ancillary info to the string. For instance, we could attach some audit-related info to reduce the amount of audit-related processing needed. When auditing is enabled, we could also call getname() on the string more than once and not need to recopy it from userspace. This patchset converts the getname()/putname() interfaces to return a struct instead of a string. For now, the struct just tracks the string in kernel space and the original userland pointer for it. Later, we'll add other information to the struct as it becomes convenient. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Eric W. Biederman 提交于
When compiling with user namespace support btrfs fails like: fs/btrfs/tree-log.c: In function ‘fill_inode_item’: fs/btrfs/tree-log.c:2955:2: error: incompatible type for argument 3 of ‘btrfs_set_inode_uid’ fs/btrfs/ctree.h:2026:1: note: expected ‘u32’ but argument is of type ‘kuid_t’ fs/btrfs/tree-log.c:2956:2: error: incompatible type for argument 3 of ‘btrfs_set_inode_gid’ fs/btrfs/ctree.h:2027:1: note: expected ‘u32’ but argument is of type ‘kgid_t’ Fix this by using i_uid_read and i_gid_read in Cc: Chris Mason <chris.mason@fusionio.com> Cc: Josef Bacik <jbacik@fusionio.com> Signed-off-by: N"Eric W. Biederman" <ebiederm@xmission.com>
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由 Eric W. Biederman 提交于
The code needs to be from_kgid(make_kgid(...)...) not from_kuid(make_kgid(...)...). Doh! Reported-by: NJan Kara <jack@suse.cz> Signed-off-by: N"Eric W. Biederman" <ebiederm@xmission.com>
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- 12 10月, 2012 6 次提交
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由 Jeff Layton 提交于
I see no callers in module code. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
In order to accomodate retrying path-based syscalls, we need to add a new "type" argument to audit_inode_child. This will tell us whether we're looking for a child entry that represents a create or a delete. If we find a parent, don't automatically assume that we need to create a new entry. Instead, use the information we have to try to find an existing entry first. Update it if one is found and create a new one if not. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
Currently, this gets set mostly by happenstance when we call into audit_inode_child. While that might be a little more efficient, it seems wrong. If the syscall ends up failing before audit_inode_child ever gets called, then you'll have an audit_names record that shows the full path but has the parent inode info attached. Fix this by passing in a parent flag when we call audit_inode that gets set to the value of LOOKUP_PARENT. We can then fix up the pathname for the audit entry correctly from the get-go. While we're at it, clean up the no-op macro for audit_inode in the !CONFIG_AUDITSYSCALL case. Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
Most of the callers get called with an inode and dentry in the reverse order. The compiler then has to reshuffle the arg registers and/or stack in order to pass them on to audit_inode_child. Reverse those arguments for a micro-optimization. Reported-by: NEric Paris <eparis@redhat.com> Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Jeff Layton 提交于
As best I can tell, whenever retval == 0, nd->path.dentry and nd->inode are also non-NULL. Eliminate those checks and the superfluous audit_context check. Signed-off-by: NEric Paris <eparis@redhat.com> Signed-off-by: NJeff Layton <jlayton@redhat.com> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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由 Arnd Bergmann 提交于
The follow_link() function always initializes its *p argument, or returns an error, but when building with 'gcc -s', the compiler gets confused by the __always_inline attribute to the function and can no longer detect where the cookie was initialized. The solution is to always initialize the pointer from follow_link, even in the error path. When building with -O2, this has zero impact on generated code and adds a single instruction in the error path for a -Os build on ARM. Without this patch, building with gcc-4.6 through gcc-4.8 and CONFIG_CC_OPTIMIZE_FOR_SIZE results in: fs/namei.c: In function 'link_path_walk': fs/namei.c:649:24: warning: 'cookie' may be used uninitialized in this function [-Wuninitialized] fs/namei.c:1544:9: note: 'cookie' was declared here fs/namei.c: In function 'path_lookupat': fs/namei.c:649:24: warning: 'cookie' may be used uninitialized in this function [-Wuninitialized] fs/namei.c:1934:10: note: 'cookie' was declared here fs/namei.c: In function 'path_openat': fs/namei.c:649:24: warning: 'cookie' may be used uninitialized in this function [-Wuninitialized] fs/namei.c:2899:9: note: 'cookie' was declared here Signed-off-by: NArnd Bergmann <arnd@arndb.de> Signed-off-by: NAl Viro <viro@zeniv.linux.org.uk>
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