The call to xfs_inobt_get_rec() in xfs_dialloc_ag() passes 'j' as
the output status variable. The immediately following
XFS_WANT_CORRUPTED_GOTO() checks the value of 'i,' which is from
the previous lookup call and has already been checked. Fix the
corruption check to use 'j.'
Signed-off-by: Brian Foster <bfoster@redhat.com>
Reviewed-by: Eric Sandeen <sandeen@redhat.com>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
CRC enabled filesystems fail log recovery with 100% reliability on
xfstests xfs/085 with the following failure:
XFS (vdb): Mounting Filesystem
XFS (vdb): Starting recovery (logdev: internal)
XFS (vdb): Corruption detected. Unmount and run xfs_repair
XFS (vdb): bad inode magic/vsn daddr 144 #0 (magic=0)
XFS: Assertion failed: 0, file: fs/xfs/xfs_inode_buf.c, line: 95
The problem is that the inode buffer has not been recovered before
the readahead on the inode buffer is issued. The checkpoint being
recovered actually allocates the inode chunk we are doing readahead
from, so what comes from disk during readahead is essentially
random and the verifier barfs on it.
This inode buffer readahead problem affects non-crc filesystems,
too, but xfstests does not trigger it at all on such
configurations....
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Log recovery has some strict ordering requirements which unordered
or reordered metadata writeback can defeat. This can occur when an
item is logged in a transaction, written back to disk, and then
logged in a new transaction before the tail of the log is moved past
the original modification.
The result of this is that when we read an object off disk for
recovery purposes, the buffer that we read may not contain the
object type that recovery is expecting and hence at the end of the
checkpoint being recovered we have an invalid object in memory.
This isn't usually a problem, as recovery will then replay all the
other checkpoints and that brings the object back to a valid and
correct state, but the issue is that while the object is in the
invalid state it can be flushed to disk. This results in the object
verifier failing and triggering a corruption shutdown of log
recover. This is correct behaviour for the verifiers - the problem
is that we are not detecting that the object we've read off disk is
newer than the transaction we are replaying.
All metadata in v5 filesystems has the LSN of it's last modification
stamped in it. This enabled log recover to read that field and
determine the age of the object on disk correctly. If the LSN of the
object on disk is older than the transaction being replayed, then we
replay the modification. If the LSN of the object matches or is more
recent than the transaction's LSN, then we should avoid overwriting
the object as that is what leads to the transient corrupt state.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
When testing LSN ordering code for v5 superblocks, it was discovered
that the the LSN embedded in the generic btree blocks was
occasionally uninitialised. These values didn't get written to disk
by metadata writeback - they got written by previous transactions in
log recovery.
The issue is here that the when the block is first allocated and
initialised, the LSN field was not initialised - it gets overwritten
before IO is issued on the buffer - but the value that is logged by
transactions that modify the header before it is written to disk
(and initialised) contain garbage. Hence the first recovery of the
buffer will stamp garbage into the LSN field, and that can cause
subsequent transactions to not replay correctly.
The fix is simply to initialise the bb_lsn field to zero when we
initialise the block for the first time.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
The calculation doesn't take into account the size of the dir v3
header, so overestimates the hash entries in a node. This causes
directory buffer overruns when splitting and merging nodes.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Tested-by: Brian Foster <bfoster@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
xfstests xfs/087 fails 100% reliably with this assert:
XFS (vdb): Mounting Filesystem
XFS (vdb): Starting recovery (logdev: internal)
XFS: Assertion failed: bp->b_flags & XBF_STALE, file: fs/xfs/xfs_buf.c, line: 548
while trying to read a dquot buffer in xlog_recover_dquot_ra_pass2().
The issue is that the buffer length to read that is passed to
xfs_buf_readahead is in units of filesystem blocks, not disk blocks.
(i.e. FSB, not daddr). Fix it but putting the correct conversion in
place.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
When doing readhaead in log recovery, we check to see if buffers are
cancelled before doing readahead. If we find a cancelled buffer,
however, we always decrement the reference count we have on it, and
that means that readahead is causing a double decrement of the
cancelled buffer reference count.
This results in log recovery *replaying cancelled buffers* as the
actual recovery pass does not find the cancelled buffer entry in the
commit phase of the second pass across a transaction. On debug
kernels, this results in an ASSERT failure like so:
XFS: Assertion failed: !(flags & XFS_BLF_CANCEL), file: fs/xfs/xfs_log_recover.c, line: 1815
xfstests generic/311 reproduces this ASSERT failure with 100%
reproducability.
Fix it by making readahead only peek at the buffer cancelled state
rather than the full accounting that xlog_check_buffer_cancelled()
does.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
The "di_size" variable comes from the disk and it's a signed 64 bit.
We check the upper limit but we should check for negative numbers as
well.
Signed-off-by: Dan Carpenter <dan.carpenter@oracle.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
TO: Dave Chinner <david@fromorbit.com>
CC: Ben Myers <bpm@sgi.com>
CC: linux-kernel@vger.kernel.org
Signed-off-by: Fengguang Wu <fengguang.wu@intel.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
It can take a long time to run log recovery operation because it is
single threaded and is bound by read latency. We can find that it took
most of the time to wait for the read IO to occur, so if one object
readahead is introduced to log recovery, it will obviously reduce the
log recovery time.
Log recovery time stat:
w/o this patch w/ this patch
real: 0m15.023s 0m7.802s
user: 0m0.001s 0m0.001s
sys: 0m0.246s 0m0.107s
Signed-off-by: Zhi Yong Wu <wuzhy@linux.vnet.ibm.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
At xfs_ail_min(), we do check if the AIL list is empty or not before
returning the first item in it with list_empty() and list_first_entry().
This can be simplified a bit with a new list operation routine that is
the list_first_entry_or_null() which has been introduced by:
commit 6d7581e62f
list: introduce list_first_entry_or_null
v2: make xfs_ail_min() as a static inline function and move it to
xfs_trans_priv.h as per Dave Chinner's comments.
Signed-off-by: Jie Liu <jeff.liu@oracle.com>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Currently the code initializizes mp->m_icsb_mutex and other things
_after_ register_hotcpu_notifier().
As the notifier takes mp->m_icsb_mutex it can happen
that it takes the lock before it's initialization.
Signed-off-by: Richard Weinberger <richard@nod.at>
Reviewed-by: Ben Myers <bpm@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Add XFS superblock v4 support for the file type field in the
directory entry feature.
This support adds a feature bit for version 4 superblocks and
leaves the original superblock 5 incompatibility bit.
Signed-off-by: Mark Tinguely <tinguely@sgi.com>
Reviewed-by: Geoffrey Wehrman <gwehrman@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Add support to propagate and add filetype values into the on-disk
directs. This involves passing the filetype into the xfs_da_args
structure along with the name and namelength for direct operations,
and encoding it into the dirent at the same time we write the inode
number into the dirent.
With write support, add the feature flag to the
XFS_SB_FEAT_INCOMPAT_ALL mask so we can now mount filesystems with
this feature set.
Performance of directory recursion is now much improved. Parallel
walk of ~50 million directory entries across hundreds of directories
improves significantly. Unpatched, no CRCs:
Walking via ls -R
real 3m19.886s
user 6m36.960s
sys 28m19.087s
THis is doing roughly 500 getdents() calls per second, and 250,000
inode lookups per second to determine the inode type at roughly
17,000 read IOPS. CPU usage is 90% kernel space.
With dtype support patched in and the fileset recreated with CRCs
enabled:
Walking via ls -R
real 0m31.316s
user 6m32.975s
sys 0m21.111s
This is doing roughly 3500 getdents() calls per second at 16,000
IOPS. There are no inode lookups at all. CPU usages is almost 100%
userspace.
This is a big win for recursive directory walks that only need to
find file names and file types.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Add support for the file type field in directory entries so that
readdir can return the type of the inode the dirent points to to
userspace without first having to read the inode off disk.
The encoding of the type field is a single byte that is added to the
end of the directory entry name length. For all intents and
purposes, it appends a "hidden" byte to the name field which
contains the type information. As the directory entry is already of
dynamic size, helpers are already required to access and decode the
direct entry structures.
Hence the relevent extraction and iteration helpers are updated to
understand the hidden byte. Helpers for reading and writing the
filetype field from the directory entries are also added. Only the
read helpers are used by this patch. It also adds all the code
necessary to read the type information out of the dirents on disk.
Further we add the superblock feature bit and helpers to indicate
that we understand the on-disk format change. This is not a
compatible change - existing kernels cannot read the new format
successfully - so an incompatible feature flag is added. We don't
yet allow filesystems to mount with this flag yet - that will be
added once write support is added.
Finally, the code to take the type from the VFS, convert it to an
XFS on-disk type and put it into the xfs_name structures passed
around is added, but the directory code does not use this field yet.
That will be in the next patch.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
For XFS, add support for Q_XGETQSTATV quotactl command.
Signed-off-by: Chandra Seetharaman <sekharan@us.ibm.com>
Reviewed-by: Rich Johnston <rjohnston@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Follow up with xfs naming style.
Signed-off-by: Zhi Yong Wu <wuzhy@linux.vnet.ibm.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
When a transaction is cancelled and the buffer log item is clean in
the transaction, the buffer log item is unconditionally freed. If
the log item is in the AIL, however, this leads to a use after free
condition as the item still has other users.
In this case, xfs_buf_item_relse() should only be called on clean
buffer items if the reference count has dropped to zero. This
ensures only the last user frees the item.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Check for CAP_SYS_ADMIN since the caller can truncate preallocated
blocks from files they do not own nor have write access to. A more
fine grained access check was considered: require the caller to
specify their own uid/gid and to use inode_permission to check for
write, but this would not catch the case of an inode not reachable
via path traversal from the callers mount namespace.
Add check for read-only filesystem to free eofblocks ioctl.
Reviewed-by: Brian Foster <bfoster@redhat.com>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Gao feng <gaofeng@cn.fujitsu.com>
Signed-off-by: Dwight Engen <dwight.engen@oracle.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Have eofblocks ioctl convert uid_t to kuid_t into internal structure.
Update internal filter matching to compare ids with kuid_t types.
Reviewed-by: Brian Foster <bfoster@redhat.com>
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Gao feng <gaofeng@cn.fujitsu.com>
Signed-off-by: Dwight Engen <dwight.engen@oracle.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Use uint32 from init_user_ns for xfs internal uid/gid
representation in xfs_icdinode, xfs_dqid_t.
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Gao feng <gaofeng@cn.fujitsu.com>
Signed-off-by: Dwight Engen <dwight.engen@oracle.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Use inode_capable() to check if SUID|SGID bits should be cleared to match
similar check in inode_change_ok().
The check for CAP_LINUX_IMMUTABLE was not modified since all other file
systems also check against init_user_ns rather than current_user_ns.
Only allow changing of projid from init_user_ns.
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Gao feng <gaofeng@cn.fujitsu.com>
Signed-off-by: Dwight Engen <dwight.engen@oracle.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Change permission check for setting ACL to use inode_owner_or_capable()
which will additionally allow a CAP_FOWNER user in a user namespace to
be able to set an ACL on an inode covered by the user namespace mapping.
Reviewed-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Gao feng <gaofeng@cn.fujitsu.com>
Signed-off-by: Dwight Engen <dwight.engen@oracle.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
The xc_cil_lock is used for two purposes - to protect the CIL
itself, and to protect the push/commit state and lists. These are
two logically separate structures and operations, so can have their
own locks. This means that pushing on the CIL and the commit wait
ordering won't contend for a lock with other transactions that are
completing concurrently. As the CIL insertion is the hottest path
throught eh CIL, this is a big win.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Now that all the log item preparation and formatting is done under
the CIL lock, we can get rid of the intermediate log vector chain
used to track items to be inserted into the CIL.
We can already find all the items to be committed from the
transaction handle, so as long as we attach the log vectors to the
item before we insert the items into the CIL, we don't need to
create a log vector chain to pass around.
This means we can move all the item insertion code into and optimise
it into a pair of simple passes across all the items in the
transaction. The first pass does the formatting and accounting, the
second inserts them all into the CIL.
We keep this two pass split so that we can separate the CIL
insertion - which must be done under the CIL spinlock - from the
formatting. We could insert each item into the CIL with a single
pass, but that massively increases the number of times we have to
grab the CIL spinlock. It is much more efficient (and hence
scalable) to do a batch operation and insert all objects in a single
lock grab.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
Now that we have the size of the log vector that has been allocated,
we can determine if we need to allocate a new log vector for
formatting and insertion. We only need to allocate a new vector if
it won't fit into the existing buffer.
However, we need to hold the CIL context lock while we do this so
that we can't race with a push draining the currently queued log
vectors. It is safe to do this as long as we do GFP_NOFS allocation
to avoid avoid memory allocation recursing into the filesystem.
Hence we can safely overwrite the existing log vector on the CIL if
it is large enough to hold all the dirty regions of the current
item.
Signed-off-by: Dave Chinner <dchinner@redhat.com>
Reviewed-by: Mark Tinguely <tinguely@sgi.com>
Signed-off-by: Ben Myers <bpm@sgi.com>
