When I run a parallel reading performan testing on a md raid1 device with
two NVMe SSDs, I observe very bad throughput in supprise: by fio with 64KB
block size, 40 seq read I/O jobs, 128 iodepth, overall throughput is
only 2.7GB/s, this is around 50% of the idea performance number.

The perf reports locking contention happens at allow_barrier() and
wait_barrier() code,
 - 41.41%  fio [kernel.kallsyms]     [k] _raw_spin_lock_irqsave
   - _raw_spin_lock_irqsave
         + 89.92% allow_barrier
         + 9.34% __wake_up
 - 37.30%  fio [kernel.kallsyms]     [k] _raw_spin_lock_irq
   - _raw_spin_lock_irq
         - 100.00% wait_barrier

The reason is, in these I/O barrier related functions,
 - raise_barrier()
 - lower_barrier()
 - wait_barrier()
 - allow_barrier()
They always hold conf->resync_lock firstly, even there are only regular
reading I/Os and no resync I/O at all. This is a huge performance penalty.

The solution is a lockless-like algorithm in I/O barrier code, and only
holding conf->resync_lock when it has to.

The original idea is from Hannes Reinecke, and Neil Brown provides
comments to improve it. I continue to work on it, and make the patch into
current form.

In the new simpler raid1 I/O barrier implementation, there are two
wait barrier functions,
 - wait_barrier()
   Which calls _wait_barrier(), is used for regular write I/O. If there is
   resync I/O happening on the same I/O barrier bucket, or the whole
   array is frozen, task will wait until no barrier on same barrier bucket,
   or the whold array is unfreezed.
 - wait_read_barrier()
   Since regular read I/O won't interfere with resync I/O (read_balance()
   will make sure only uptodate data will be read out), it is unnecessary
   to wait for barrier in regular read I/Os, waiting in only necessary
   when the whole array is frozen.

The operations on conf->nr_pending[idx], conf->nr_waiting[idx], conf->
barrier[idx] are very carefully designed in raise_barrier(),
lower_barrier(), _wait_barrier() and wait_read_barrier(), in order to
avoid unnecessary spin locks in these functions. Once conf->
nr_pengding[idx] is increased, a resync I/O with same barrier bucket index
has to wait in raise_barrier(). Then in _wait_barrier() if no barrier
raised in same barrier bucket index and array is not frozen, the regular
I/O doesn't need to hold conf->resync_lock, it can just increase
conf->nr_pending[idx], and return to its caller. wait_read_barrier() is
very similar to _wait_barrier(), the only difference is it only waits when
array is frozen. For heavy parallel reading I/Os, the lockless I/O barrier
code almostly gets rid of all spin lock cost.

This patch significantly improves raid1 reading peroformance. From my
testing, a raid1 device built by two NVMe SSD, runs fio with 64KB
blocksize, 40 seq read I/O jobs, 128 iodepth, overall throughput
increases from 2.7GB/s to 4.6GB/s (+70%).

Changelog
V4:
- Change conf->nr_queued[] to atomic_t.
- Define BARRIER_BUCKETS_NR_BITS by (PAGE_SHIFT - ilog2(sizeof(atomic_t)))
V3:
- Add smp_mb__after_atomic() as Shaohua and Neil suggested.
- Change conf->nr_queued[] from atomic_t to int.
- Change conf->array_frozen from atomic_t back to int, and use
  READ_ONCE(conf->array_frozen) to check value of conf->array_frozen
  in _wait_barrier() and wait_read_barrier().
- In _wait_barrier() and wait_read_barrier(), add a call to
  wake_up(&conf->wait_barrier) after atomic_dec(&conf->nr_pending[idx]),
  to fix a deadlock between  _wait_barrier()/wait_read_barrier and
  freeze_array().
V2:
- Remove a spin_lock/unlock pair in raid1d().
- Add more code comments to explain why there is no racy when checking two
  atomic_t variables at same time.
V1:
- Original RFC patch for comments.
Signed-off-by: Coly Li <colyli@suse.de>
Cc: Shaohua Li <shli@fb.com>
Cc: Hannes Reinecke <hare@suse.com>
Cc: Johannes Thumshirn <jthumshirn@suse.de>
Cc: Guoqing Jiang <gqjiang@suse.com>
Reviewed-by: Neil Brown <neilb@suse.de>
Signed-off-by: Shaohua Li <shli@fb.com>

'Commit 79ef3a8a ("raid1: Rewrite the implementation of iobarrier.")'
introduces a sliding resync window for raid1 I/O barrier, this idea limits
I/O barriers to happen only inside a slidingresync window, for regular
I/Os out of this resync window they don't need to wait for barrier any
more. On large raid1 device, it helps a lot to improve parallel writing
I/O throughput when there are background resync I/Os performing at
same time.

The idea of sliding resync widow is awesome, but code complexity is a
challenge. Sliding resync window requires several variables to work
collectively, this is complexed and very hard to make it work correctly.
Just grep "Fixes: 79ef3a8a" in kernel git log, there are 8 more patches
to fix the original resync window patch. This is not the end, any further
related modification may easily introduce more regreassion.

Therefore I decide to implement a much simpler raid1 I/O barrier, by
removing resync window code, I believe life will be much easier.

The brief idea of the simpler barrier is,
 - Do not maintain a global unique resync window
 - Use multiple hash buckets to reduce I/O barrier conflicts, regular
   I/O only has to wait for a resync I/O when both them have same barrier
   bucket index, vice versa.
 - I/O barrier can be reduced to an acceptable number if there are enough
   barrier buckets

Here I explain how the barrier buckets are designed,
 - BARRIER_UNIT_SECTOR_SIZE
   The whole LBA address space of a raid1 device is divided into multiple
   barrier units, by the size of BARRIER_UNIT_SECTOR_SIZE.
   Bio requests won't go across border of barrier unit size, that means
   maximum bio size is BARRIER_UNIT_SECTOR_SIZE<<9 (64MB) in bytes.
   For random I/O 64MB is large enough for both read and write requests,
   for sequential I/O considering underlying block layer may merge them
   into larger requests, 64MB is still good enough.
   Neil also points out that for resync operation, "we want the resync to
   move from region to region fairly quickly so that the slowness caused
   by having to synchronize with the resync is averaged out over a fairly
   small time frame". For full speed resync, 64MB should take less then 1
   second. When resync is competing with other I/O, it could take up a few
   minutes. Therefore 64MB size is fairly good range for resync.

 - BARRIER_BUCKETS_NR
   There are BARRIER_BUCKETS_NR buckets in total, which is defined by,
        #define BARRIER_BUCKETS_NR_BITS   (PAGE_SHIFT - 2)
        #define BARRIER_BUCKETS_NR        (1<<BARRIER_BUCKETS_NR_BITS)
   this patch makes the bellowed members of struct r1conf from integer
   to array of integers,
        -       int                     nr_pending;
        -       int                     nr_waiting;
        -       int                     nr_queued;
        -       int                     barrier;
        +       int                     *nr_pending;
        +       int                     *nr_waiting;
        +       int                     *nr_queued;
        +       int                     *barrier;
   number of the array elements is defined as BARRIER_BUCKETS_NR. For 4KB
   kernel space page size, (PAGE_SHIFT - 2) indecates there are 1024 I/O
   barrier buckets, and each array of integers occupies single memory page.
   1024 means for a request which is smaller than the I/O barrier unit size
   has ~0.1% chance to wait for resync to pause, which is quite a small
   enough fraction. Also requesting single memory page is more friendly to
   kernel page allocator than larger memory size.

 - I/O barrier bucket is indexed by bio start sector
   If multiple I/O requests hit different I/O barrier units, they only need
   to compete I/O barrier with other I/Os which hit the same I/O barrier
   bucket index with each other. The index of a barrier bucket which a
   bio should look for is calculated by sector_to_idx() which is defined
   in raid1.h as an inline function,
        static inline int sector_to_idx(sector_t sector)
        {
                return hash_long(sector >> BARRIER_UNIT_SECTOR_BITS,
                                BARRIER_BUCKETS_NR_BITS);
        }
   Here sector_nr is the start sector number of a bio.

 - Single bio won't go across boundary of a I/O barrier unit
   If a request goes across boundary of barrier unit, it will be split. A
   bio may be split in raid1_make_request() or raid1_sync_request(), if
   sectors returned by align_to_barrier_unit_end() is smaller than
   original bio size.

Comparing to single sliding resync window,
 - Currently resync I/O grows linearly, therefore regular and resync I/O
   will conflict within a single barrier units. So the I/O behavior is
   similar to single sliding resync window.
 - But a barrier unit bucket is shared by all barrier units with identical
   barrier uinit index, the probability of conflict might be higher
   than single sliding resync window, in condition that writing I/Os
   always hit barrier units which have identical barrier bucket indexs with
   the resync I/Os. This is a very rare condition in real I/O work loads,
   I cannot imagine how it could happen in practice.
 - Therefore we can achieve a good enough low conflict rate with much
   simpler barrier algorithm and implementation.

There are two changes should be noticed,
 - In raid1d(), I change the code to decrease conf->nr_pending[idx] into
   single loop, it looks like this,
        spin_lock_irqsave(&conf->device_lock, flags);
        conf->nr_queued[idx]--;
        spin_unlock_irqrestore(&conf->device_lock, flags);
   This change generates more spin lock operations, but in next patch of
   this patch set, it will be replaced by a single line code,
        atomic_dec(&conf->nr_queueud[idx]);
   So we don't need to worry about spin lock cost here.
 - Mainline raid1 code split original raid1_make_request() into
   raid1_read_request() and raid1_write_request(). If the original bio
   goes across an I/O barrier unit size, this bio will be split before
   calling raid1_read_request() or raid1_write_request(),  this change
   the code logic more simple and clear.
 - In this patch wait_barrier() is moved from raid1_make_request() to
   raid1_write_request(). In raid_read_request(), original wait_barrier()
   is replaced by raid1_read_request().
   The differnece is wait_read_barrier() only waits if array is frozen,
   using different barrier function in different code path makes the code
   more clean and easy to read.
Changelog
V4:
- Add alloc_r1bio() to remove redundant r1bio memory allocation code.
- Fix many typos in patch comments.
- Use (PAGE_SHIFT - ilog2(sizeof(int))) to define BARRIER_BUCKETS_NR_BITS.
V3:
- Rebase the patch against latest upstream kernel code.
- Many fixes by review comments from Neil,
  - Back to use pointers to replace arraries in struct r1conf
  - Remove total_barriers from struct r1conf
  - Add more patch comments to explain how/why the values of
    BARRIER_UNIT_SECTOR_SIZE and BARRIER_BUCKETS_NR are decided.
  - Use get_unqueued_pending() to replace get_all_pendings() and
    get_all_queued()
  - Increase bucket number from 512 to 1024
- Change code comments format by review from Shaohua.
V2:
- Use bio_split() to split the orignal bio if it goes across barrier unit
  bounday, to make the code more simple, by suggestion from Shaohua and
  Neil.
- Use hash_long() to replace original linear hash, to avoid a possible
  confilict between resync I/O and sequential write I/O, by suggestion from
  Shaohua.
- Add conf->total_barriers to record barrier depth, which is used to
  control number of parallel sync I/O barriers, by suggestion from Shaohua.
- In V1 patch the bellowed barrier buckets related members in r1conf are
  allocated in memory page. To make the code more simple, V2 patch moves
  the memory space into struct r1conf, like this,
        -       int                     nr_pending;
        -       int                     nr_waiting;
        -       int                     nr_queued;
        -       int                     barrier;
        +       int                     nr_pending[BARRIER_BUCKETS_NR];
        +       int                     nr_waiting[BARRIER_BUCKETS_NR];
        +       int                     nr_queued[BARRIER_BUCKETS_NR];
        +       int                     barrier[BARRIER_BUCKETS_NR];
  This change is by the suggestion from Shaohua.
- Remove some inrelavent code comments, by suggestion from Guoqing.
- Add a missing wait_barrier() before jumping to retry_write, in
  raid1_make_write_request().
V1:
- Original RFC patch for comments
Signed-off-by: Coly Li <colyli@suse.de>
Cc: Johannes Thumshirn <jthumshirn@suse.de>
Cc: Guoqing Jiang <gqjiang@suse.com>
Reviewed-by: Neil Brown <neilb@suse.de>
Signed-off-by: Shaohua Li <shli@fb.com>

Although llist provides proper APIs, they are not used. Make them used.
Signed-off-by: Byungchul Park <byungchul.park@lge.com>
Signed-off-by: Shaohua Li <shli@fb.com>

Firstly bio_clone_mddev() is used in raid normal I/O and isn't
in resync I/O path.

Secondly all the direct access to bvec table in raid happens on
resync I/O except for write behind of raid1, in which we still
use bio_clone() for allocating new bvec table.

So this patch replaces bio_clone() with bio_clone_fast()
in bio_clone_mddev().

Also kill bio_clone_mddev() and call bio_clone_fast() directly, as
suggested by Christoph Hellwig.
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Ming Lei <tom.leiming@gmail.com>
Signed-off-by: Shaohua Li <shli@fb.com>

mddev is never NULL and neither is ->bio_set, so
remove the check.
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Ming Lei <tom.leiming@gmail.com>
Signed-off-by: Shaohua Li <shli@fb.com>

Write behind need to replace pages in bio's bvecs, and we have
to clone a fresh bio with new bvec table, so use the introduced
bio_clone_bioset_partial() for it.

For other bio_clone_mddev() cases, we will use fast clone since
they don't need to touch bvec table.
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Ming Lei <tom.leiming@gmail.com>
Signed-off-by: Shaohua Li <shli@fb.com>

The current behaviour is to fall back to allocate
bio from 'fs_bio_set', that isn't a correct way
because it might cause deadlock.

So this patch simply return failure if mddev->bio_set
can't be created.
Reviewed-by: Christoph Hellwig <hch@lst.de>
Signed-off-by: Ming Lei <tom.leiming@gmail.com>
Signed-off-by: Shaohua Li <shli@fb.com>

md still need bio clone(not the fast version) for behind write,
and it is more efficient to use bio_clone_bioset_partial().

The idea is simple and just copy the bvecs range specified from
parameters.
Reviewed-by: Christoph Hellwig <hch@lst.de>
Reviewed-by: Jens Axboe <axboe@fb.com>
Signed-off-by: Ming Lei <tom.leiming@gmail.com>
Signed-off-by: Shaohua Li <shli@fb.com>

This makes md do the same thing as dm for write same IO failure. Please
see 7eee4ae2(dm: disable WRITE SAME if it fails) for details why we need
this.

We did a little bit different than dm. Instead of disabling writesame in
the first IO error, we disable it till next writesame IO coming after
the first IO error. This way we don't need to clone a bio.

Also reported here: https://bugzilla.kernel.org/show_bug.cgi?id=118581Suggested-by: NeilBrown <neilb@suse.com>
Acked-by: NeilBrown <neilb@suse.com>
Signed-off-by: Shaohua Li <shli@fb.com>

stripes which are being reclaimed are still accounted into cached
stripes. The reclaim takes time. r5c_do_reclaim isn't aware of the
stripes and does unnecessary stripe reclaim. In practice, I saw one
stripe is reclaimed one time. This will cause bad IO pattern. Fixing
this by excluding the reclaing stripes in the check.

Cc: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

When log space is tight, we try to reclaim stripes from log head. There
are stripes which can't be reclaimed right now if some conditions are
met. We skip such stripes but accidentally count them, which might cause
no stripes are claimed. Fixing this by only counting valid stripes.

Cc: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

I'm starting document of the raid5-cache feature. Please note this is a
kernel doc instead of a mdadm manual, so I don't add the details about
how to use the feature in mdadm side.

Cc: NeilBrown <neilb@suse.com>
Reviewed-by: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

Signed-off-by: Shaohua Li <shli@fb.com>

Commit: cbd19983 ("md: Fix unfortunate interaction with evms")
change mddev_put() so that it would not destroy an md device while
->ctime was non-zero.

Unfortunately, we didn't make sure to clear ->ctime when unloading
the module, so it is possible for an md device to remain after
module unload.  An attempt to open such a device will trigger
an invalid memory reference in:
  get_gendisk -> kobj_lookup -> exact_lock -> get_disk

when tring to access disk->fops, which was in the module that has
been removed.

So ensure we clear ->ctime in md_exit(), and explain how that is useful,
as it isn't immediately obvious when looking at the code.

Fixes: cbd19983 ("md: Fix unfortunate interaction with evms")
Tested-by: Guoqing Jiang <gqjiang@suse.com>
Signed-off-by: NeilBrown <neilb@suse.com>
Signed-off-by: Shaohua Li <shli@fb.com>

It is important to be able to flush all stripes in raid5-cache.
Therefore, we need reserve some space on the journal device for
these flushes. If flush operation includes pending writes to the
stripe, we need to reserve (conf->raid_disk + 1) pages per stripe
for the flush out. This reduces the efficiency of journal space.
If we exclude these pending writes from flush operation, we only
need (conf->max_degraded + 1) pages per stripe.

With this patch, when log space is critical (R5C_LOG_CRITICAL=1),
pending writes will be excluded from stripe flush out. Therefore,
we can reduce reserved space for flush out and thus improve journal
device efficiency.
Signed-off-by: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

Chunk aligned read significantly reduces CPU usage of raid456.
However, it is not safe to fully bypass the write back cache.
This patch enables chunk aligned read with write back cache.

For chunk aligned read, we track stripes in write back cache at
a bigger granularity, "big_stripe". Each chunk may contain more
than one stripe (for example, a 256kB chunk contains 64 4kB-page,
so this chunk contain 64 stripes). For chunk_aligned_read, these
stripes are grouped into one big_stripe, so we only need one lookup
for the whole chunk.

For each big_stripe, struct big_stripe_info tracks how many stripes
of this big_stripe are in the write back cache. We count how many
stripes of this big_stripe are in the write back cache. These
counters are tracked in a radix tree (big_stripe_tree).
r5c_tree_index() is used to calculate keys for the radix tree.

chunk_aligned_read() calls r5c_big_stripe_cached() to look up
big_stripe of each chunk in the tree. If this big_stripe is in the
tree, chunk_aligned_read() aborts. This look up is protected by
rcu_read_lock().

It is necessary to remember whether a stripe is counted in
big_stripe_tree. Instead of adding new flag, we reuses existing flags:
STRIPE_R5C_PARTIAL_STRIPE and STRIPE_R5C_FULL_STRIPE. If either of these
two flags are set, the stripe is counted in big_stripe_tree. This
requires moving set_bit(STRIPE_R5C_PARTIAL_STRIPE) to
r5c_try_caching_write(); and moving clear_bit of
STRIPE_R5C_PARTIAL_STRIPE and STRIPE_R5C_FULL_STRIPE to
r5c_finish_stripe_write_out().
Signed-off-by: Song Liu <songliubraving@fb.com>
Reviewed-by: NeilBrown <neilb@suse.com>
Signed-off-by: Shaohua Li <shli@fb.com>

It will be used in drivers/md/raid5-cache.c
Signed-off-by: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

We made raid5 stripe handling multi-thread before. It works well for
SSD. But for harddisk, the multi-threading creates more disk seek, so
not always improve performance. For several hard disks based raid5,
multi-threading is required as raid5d becames a bottleneck especially
for sequential write.

To overcome the disk seek issue, we only dispatch IO from raid5d if the
array is harddisk based. Other threads can still handle stripes, but
can't dispatch IO.

Idealy, we should control IO dispatching order according to IO position
interrnally. Right now we still depend on block layer, which isn't very
efficient sometimes though.

My setup has 9 harddisks, each disk can do around 180M/s sequential
write. So in theory, the raid5 can do 180 * 8 = 1440M/s sequential
write. The test machine uses an ATOM CPU. I measure sequential write
with large iodepth bandwidth to raid array:

without patch: ~600M/s
without patch and group_thread_cnt=4: 750M/s
with patch and group_thread_cnt=4: 950M/s
with patch, group_thread_cnt=4, skip_copy=1: 1150M/s

We are pretty close to the maximum bandwidth in the large iodepth
iodepth case. The performance gap of small iodepth sequential write
between software raid and theory value is still very big though, because
we don't have an efficient pipeline.

Cc: NeilBrown <neilb@suse.com>
Cc: Song Liu <songliubraving@fb.com>
Signed-off-by: Shaohua Li <shli@fb.com>

Recently I receive a bug report that on Linux v3.0 based kerenl, hot add
disk to a md linear device causes kernel crash at linear_congested(). From
the crash image analysis, I find in linear_congested(), mddev->raid_disks
contains value N, but conf->disks[] only has N-1 pointers available. Then
a NULL pointer deference crashes the kernel.

There is a race between linear_add() and linear_congested(), RCU stuffs
used in these two functions cannot avoid the race. Since Linuv v4.0
RCU code is replaced by introducing mddev_suspend().  After checking the
upstream code, it seems linear_congested() is not called in
generic_make_request() code patch, so mddev_suspend() cannot provent it
from being called. The possible race still exists.

Here I explain how the race still exists in current code.  For a machine
has many CPUs, on one CPU, linear_add() is called to add a hard disk to a
md linear device; at the same time on other CPU, linear_congested() is
called to detect whether this md linear device is congested before issuing
an I/O request onto it.

Now I use a possible code execution time sequence to demo how the possible
race happens,

seq    linear_add()                linear_congested()
 0                                 conf=mddev->private
 1   oldconf=mddev->private
 2   mddev->raid_disks++
 3                              for (i=0; i<mddev->raid_disks;i++)
 4                                bdev_get_queue(conf->disks[i].rdev->bdev)
 5   mddev->private=newconf

In linear_add() mddev->raid_disks is increased in time seq 2, and on
another CPU in linear_congested() the for-loop iterates conf->disks[i] by
the increased mddev->raid_disks in time seq 3,4. But conf with one more
element (which is a pointer to struct dev_info type) to conf->disks[] is
not updated yet, accessing its structure member in time seq 4 will cause a
NULL pointer deference fault.

To fix this race, there are 2 parts of modification in the patch,
 1) Add 'int raid_disks' in struct linear_conf, as a copy of
    mddev->raid_disks. It is initialized in linear_conf(), always being
    consistent with pointers number of 'struct dev_info disks[]'. When
    iterating conf->disks[] in linear_congested(), use conf->raid_disks to
    replace mddev->raid_disks in the for-loop, then NULL pointer deference
    will not happen again.
 2) RCU stuffs are back again, and use kfree_rcu() in linear_add() to
    free oldconf memory. Because oldconf may be referenced as mddev->private
    in linear_congested(), kfree_rcu() makes sure that its memory will not
    be released until no one uses it any more.
Also some code comments are added in this patch, to make this modification
to be easier understandable.

This patch can be applied for kernels since v4.0 after commit:
3be260cc ("md/linear: remove rcu protections in favour of
suspend/resume"). But this bug is reported on Linux v3.0 based kernel, for
people who maintain kernels before Linux v4.0, they need to do some back
back port to this patch.

Changelog:
 - V3: add 'int raid_disks' in struct linear_conf, and use kfree_rcu() to
       replace rcu_call() in linear_add().
 - v2: add RCU stuffs by suggestion from Shaohua and Neil.
 - v1: initial effort.
Signed-off-by: Coly Li <colyli@suse.de>
Cc: Shaohua Li <shli@fb.com>
Cc: Neil Brown <neilb@suse.com>
Cc: stable@vger.kernel.org
Signed-off-by: Shaohua Li <shli@fb.com>

Pull x86 fixes from Ingo Molnar:
 "Last minute x86 fixes:

   - Fix a softlockup detector warning and long delays if using ptdump
     with KASAN enabled.

   - Two more TSC-adjust fixes for interesting firmware interactions.

   - Two commits to fix an AMD CPU topology enumeration bug that caused
     a measurable gaming performance regression"

* 'x86-urgent-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip:
  x86/mm/ptdump: Fix soft lockup in page table walker
  x86/tsc: Make the TSC ADJUST sanitizing work for tsc_reliable
  x86/tsc: Avoid the large time jump when sanitizing TSC ADJUST
  x86/CPU/AMD: Fix Zen SMT topology
  x86/CPU/AMD: Bring back Compute Unit ID

Pull timer fix from Ingo Molnar:
 "Fix a sporadic missed timer hw reprogramming bug that can result in
  random delays"

* 'timers-urgent-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip:
  tick/nohz: Fix possible missing clock reprog after tick soft restart

Pull perf fixes from Ingo Molnar:
 "A kernel crash fix plus three tooling fixes"

* 'perf-urgent-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip:
  perf/core: Fix crash in perf_event_read()
  perf callchain: Reference count maps
  perf diff: Fix -o/--order option behavior (again)
  perf diff: Fix segfault on 'perf diff -o N' option

Pull lockdep fix from Ingo Molnar:
 "This fixes an ugly lockdep stack trace output regression. (But also
  affects other stacktrace users such as kmemleak, KASAN, etc)"

* 'locking-urgent-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip:
  stacktrace, lockdep: Fix address, newline ugliness

Pull irq fixes from Ingo Molnar:
 "Two last minute ARM irqchip driver fixes"

* 'irq-urgent-for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/tip/tip:
  irqchip/mxs: Enable SKIP_SET_WAKE and MASK_ON_SUSPEND
  irqchip/keystone: Fix "scheduling while atomic" on rt

Pull btrfs fixes from Chris Mason:
 "This has two last minute fixes. The highest priority here is a
  regression fix for the decompression code, but we also fixed up a
  problem with the 32-bit compat ioctls.

  The decompression bug could hand back the wrong data on big reads when
  zlib was used. I have a larger cleanup to make the math here less
  error prone, but at this stage in the release Omar's patch is the best
  choice"

* 'for-linus-4.10' of git://git.kernel.org/pub/scm/linux/kernel/git/mason/linux-btrfs:
  btrfs: fix btrfs_decompress_buf2page()
  btrfs: fix btrfs_compat_ioctl failures on non-compat ioctls

Pull SCSI fixes from James Bottomley:
 "Six fairly small fixes. None is a real show stopper, two automation
  detected problems: one memory leak, one use after free and four others
  each of which fixes something that has been a significant source of
  annoyance to someone"

* tag 'scsi-fixes' of git://git.kernel.org/pub/scm/linux/kernel/git/jejb/scsi:
  scsi: zfcp: fix use-after-free by not tracing WKA port open/close on failed send
  scsi: aacraid: Fix INTx/MSI-x issue with older controllers
  scsi: mpt3sas: disable ASPM for MPI2 controllers
  scsi: mpt3sas: Force request partial completion alignment
  scsi: qla2xxx: Avoid that issuing a LIP triggers a kernel crash
  scsi: qla2xxx: Fix a recently introduced memory leak

If btrfs_decompress_buf2page() is handed a bio with its page in the
middle of the working buffer, then we adjust the offset into the working
buffer. After we copy into the bio, we advance the iterator by the
number of bytes we copied. Then, we have some logic to handle the case
of discontiguous pages and adjust the offset into the working buffer
again. However, if we didn't advance the bio to a new page, we may enter
this case in error, essentially repeating the adjustment that we already
made when we entered the function. The end result is bogus data in the
bio.

Previously, we only checked for this case when we advanced to a new
page, but the conversion to bio iterators changed that. This restores
the old, correct behavior.

A case I saw when testing with zlib was:

    buf_start = 42769
    total_out = 46865
    working_bytes = total_out - buf_start = 4096
    start_byte = 45056

The condition (total_out > start_byte && buf_start < start_byte) is
true, so we adjust the offset:

    buf_offset = start_byte - buf_start = 2287
    working_bytes -= buf_offset = 1809
    current_buf_start = buf_start = 42769

Then, we copy

    bytes = min(bvec.bv_len, PAGE_SIZE - buf_offset, working_bytes) = 1809
    buf_offset += bytes = 4096
    working_bytes -= bytes = 0
    current_buf_start += bytes = 44578

After bio_advance(), we are still in the same page, so start_byte is the
same. Then, we check (total_out > start_byte && current_buf_start < start_byte),
which is true! So, we adjust the values again:

    buf_offset = start_byte - buf_start = 2287
    working_bytes = total_out - start_byte = 1809
    current_buf_start = buf_start + buf_offset = 45056

But note that working_bytes was already zero before this, so we should
have stopped copying.

Fixes: 974b1adc ("btrfs: use bio iterators for the decompression handlers")
Reported-by: Pat Erley <pat-lkml@erley.org>
Reviewed-by: Chris Mason <clm@fb.com>
Signed-off-by: Omar Sandoval <osandov@fb.com>
Signed-off-by: Chris Mason <clm@fb.com>
Reviewed-by: Liu Bo <bo.li.liu@oracle.com>
Tested-by: Liu Bo <bo.li.liu@oracle.com>

Pull networking fixes from David Miller:

 1) If the timing is wrong we can indefinitely stop generating new ipv6
    temporary addresses, from Marcus Huewe.

 2) Don't double free per-cpu stats in ipv6 SIT tunnel driver, from Cong
    Wang.

 3) Put protections in place so that AF_PACKET is not able to submit
    packets which don't even have a link level header to drivers. From
    Willem de Bruijn.

 4) Fix memory leaks in ipv4 and ipv6 multicast code, from Hangbin Liu.

 5) Don't use udp_ioctl() in l2tp code, UDP version expects a UDP socket
    and that doesn't go over very well when it is passed an L2TP one.
    Fix from Eric Dumazet.

 6) Don't crash on NULL pointer in phy_attach_direct(), from Florian
    Fainelli.

* git://git.kernel.org/pub/scm/linux/kernel/git/davem/net:
  l2tp: do not use udp_ioctl()
  xen-netfront: Delete rx_refill_timer in xennet_disconnect_backend()
  NET: mkiss: Fix panic
  net: hns: Fix the device being used for dma mapping during TX
  net: phy: Initialize mdio clock at probe function
  igmp, mld: Fix memory leak in igmpv3/mld_del_delrec()
  xen-netfront: Improve error handling during initialization
  sierra_net: Skip validating irrelevant fields for IDLE LSIs
  sierra_net: Add support for IPv6 and Dual-Stack Link Sense Indications
  kcm: fix 0-length case for kcm_sendmsg()
  xen-netfront: Rework the fix for Rx stall during OOM and network stress
  net: phy: Fix PHY module checks and NULL deref in phy_attach_direct()
  net: thunderx: Fix PHY autoneg for SGMII QLM mode
  net: dsa: Do not destroy invalid network devices
  ping: fix a null pointer dereference
  packet: round up linear to header len
  net: introduce device min_header_len
  sit: fix a double free on error path
  lwtunnel: valid encap attr check should return 0 when lwtunnel is disabled
  ipv6: addrconf: fix generation of new temporary addresses

Pull rdma fixes from Doug Ledford:
 "Third round of -rc fixes for 4.10 kernel:

   - two security related issues in the rxe driver

   - one compile issue in the RDMA uapi header"

* tag 'for-linus' of git://git.kernel.org/pub/scm/linux/kernel/git/dledford/rdma:
  RDMA: Don't reference kernel private header from UAPI header
  IB/rxe: Fix mem_check_range integer overflow
  IB/rxe: Fix resid update

Pull i2c bugfixes from Wolfram Sang:
 "Two bugfixes (proper IO mapping and use of mutex) for a driver feature
  we introduced in this cycle"

* 'i2c/for-current' of git://git.kernel.org/pub/scm/linux/kernel/git/wsa/linux:
  i2c: piix4: Request the SMBUS semaphore inside the mutex
  i2c: piix4: Fix request_region size

Pull MMC host fix from Ulf Hansson:
 "mmci: Fix hang while waiting for busy-end interrupt"

* tag 'mmc-v4.10-rc7' of git://git.kernel.org/pub/scm/linux/kernel/git/ulfh/mmc:
  mmc: mmci: avoid clearing ST Micro busy end interrupt mistakenly

Pull sound fixes from Takashi Iwai:
 "Here are some last-minute fixes: two fixes for races in ALSA sequencer
  queue spotted by syzkaller, a revert for a regression of LINE6 driver
  (since 4.9), and a trivial new codec ID addition for Nvidia HDMI"

* tag 'sound-4.10' of git://git.kernel.org/pub/scm/linux/kernel/git/tiwai/sound:
  ALSA: hda - adding a new NV HDMI/DP codec ID in the driver
  ALSA: seq: Fix race at creating a queue
  Revert "ALSA: line6: Only determine control port properties if needed"
  ALSA: seq: Don't handle loop timeout at snd_seq_pool_done()

Pull nfsd revert from Bruce Fields:
 "This patch turned out to have a couple problems. The problems are
  fixable, but at least one of the fixes is a little ugly. The original
  bug has always been there, so we can wait another week or two to get
  this right"

* tag 'nfsd-4.10-3' of git://linux-nfs.org/~bfields/linux:
  nfsd: Revert "nfsd: special case truncates some more"

Pull powerpc fixes friom Michael Ellerman:
 "Apologies for the late pull request, but Ben has been busy finding bugs.

   - Userspace was semi-randomly segfaulting on radix due to us
     incorrectly handling a fault triggered by autonuma, caused by a
     patch we merged earlier in v4.10 to prevent the kernel executing
     userspace.

   - We weren't marking host IPIs properly for KVM in the OPAL ICP
     backend.

   - The ERAT flushing on radix was missing an isync and was incorrectly
     marked as DD1 only.

   - The powernv CPU hotplug code was missing a wakeup type and failing
     to flush the interrupt correctly when using OPAL ICP

  Thanks to Benjamin Herrenschmidt"

* tag 'powerpc-4.10-4' of git://git.kernel.org/pub/scm/linux/kernel/git/powerpc/linux:
  powerpc/powernv: Properly set "host-ipi" on IPIs
  powerpc/powernv: Fix CPU hotplug to handle waking on HVI
  powerpc/mm/radix: Update ERAT flushes when invalidating TLB
  powerpc/mm: Fix spurrious segfaults on radix with autonuma

udp_ioctl(), as its name suggests, is used by UDP protocols,
but is also used by L2TP :(

L2TP should use its own handler, because it really does not
look the same.

SIOCINQ for instance should not assume UDP checksum or headers.

Thanks to Andrey and syzkaller team for providing the report
and a nice reproducer.

While crashes only happen on recent kernels (after commit
7c13f97f ("udp: do fwd memory scheduling on dequeue")), this
probably needs to be backported to older kernels.

Fixes: 7c13f97f ("udp: do fwd memory scheduling on dequeue")
Fixes: 85584672 ("udp: Fix udp_poll() and ioctl()")
Signed-off-by: Eric Dumazet <edumazet@google.com>
Reported-by: Andrey Konovalov <andreyknvl@google.com>
Acked-by: Paolo Abeni <pabeni@redhat.com>
Signed-off-by: David S. Miller <davem@davemloft.net>

Merge branch 'for-chris' of git://git.kernel.org/pub/scm/linux/kernel/git/kdave/linux into for-linus-4.10

rx_refill_timer should be deleted as soon as we disconnect from the
backend since otherwise it is possible for the timer to go off before
we get to xennet_destroy_queues(). If this happens we may dereference
queue->rx.sring which is set to NULL in xennet_disconnect_backend().
Signed-off-by: Boris Ostrovsky <boris.ostrovsky@oracle.com>
CC: stable@vger.kernel.org
Reviewed-by: Juergen Gross <jgross@suse.com>
Signed-off-by: David S. Miller <davem@davemloft.net>

If a USB-to-serial adapter is unplugged, the driver re-initializes, with
dev->hard_header_len and dev->addr_len set to zero, instead of the correct
values.  If then a packet is sent through the half-dead interface, the
kernel will panic due to running out of headroom in the skb when pushing
for the AX.25 headers resulting in this panic:

[<c0595468>] (skb_panic) from [<c0401f70>] (skb_push+0x4c/0x50)
[<c0401f70>] (skb_push) from [<bf0bdad4>] (ax25_hard_header+0x34/0xf4 [ax25])
[<bf0bdad4>] (ax25_hard_header [ax25]) from [<bf0d05d4>] (ax_header+0x38/0x40 [mkiss])
[<bf0d05d4>] (ax_header [mkiss]) from [<c041b584>] (neigh_compat_output+0x8c/0xd8)
[<c041b584>] (neigh_compat_output) from [<c043e7a8>] (ip_finish_output+0x2a0/0x914)
[<c043e7a8>] (ip_finish_output) from [<c043f948>] (ip_output+0xd8/0xf0)
[<c043f948>] (ip_output) from [<c043f04c>] (ip_local_out_sk+0x44/0x48)

This patch makes mkiss behave like the 6pack driver. 6pack does not
panic.  In 6pack.c sp_setup() (same function name here) the values for
dev->hard_header_len and dev->addr_len are set to the same values as in
my mkiss patch.

[ralf@linux-mips.org: Massages original submission to conform to the usual
standards for patch submissions.]
Signed-off-by: Thomas Osterried <thomas@osterried.de>
Signed-off-by: Ralf Baechle <ralf@linux-mips.org>
Signed-off-by: David S. Miller <davem@davemloft.net>

This patch fixes the device being used to DMA map skb->data.
Erroneous device assignment causes the crash when SMMU is enabled.
This happens during TX since buffer gets DMA mapped with device
correspondign to net_device and gets unmapped using the device
related to DSAF.
Signed-off-by: Kejian Yan <yankejian@huawei.com>
Reviewed-by: Yisen Zhuang <yisen.zhuang@huawei.com>
Signed-off-by: Salil Mehta <salil.mehta@huawei.com>
Signed-off-by: David S. Miller <davem@davemloft.net>