| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
iio: magnetometer: ak8975: fix potential kernel stack memory leak
Currently in the AK8975 driver there are four instances where potential
uninitialized kernel stack memory leaks can occur. If
i2c_smbus_read_i2c_block_data_or_emulated() returns a value less than
the size of the buffer, uninitialized bytes are retained in the buffer
and later the buffer is passed on to IIO buffers, potentially leaking
memory to userspace.
Fix this by adding checks whether the return value of the function is
equal to the size of the buffer and subsequently if the value is
lesser than zero to distinguish from a returned error code. |
| In the Linux kernel, the following vulnerability has been resolved:
iio: adc: xilinx-ams: fix out-of-bounds channel lookup in event handling
ams_event_to_channel() may return a pointer past the end of
dev->channels when no matching scan_index is found. This can lead
to invalid memory access in ams_handle_event().
Add a bounds check in ams_event_to_channel() and return NULL when
no channel is found. Also guard the caller to safely handle this
case. |
| In the Linux kernel, the following vulnerability has been resolved:
iio: accel: mma8452: handle I2C read error(s) in mma8452_read()
Currently, If i2c_smbus_read_i2c_block_data() fails but
mma8452_set_runtime_pm_state() succeeds, mma8452_read() returns 0.
As a result, the caller mma8452_read_raw() assumes the read was
successful and proceeds to use a buffer containing uninitialized
stack memory.
Add proper checking of the I2C read return value and propagate errors
to the caller. |
| In the Linux kernel, the following vulnerability has been resolved:
fs/ntfs3: add bounds check to run_get_highest_vcn()
run_get_highest_vcn() parses a packed NTFS mapping-pairs buffer without
any length bound, relying solely on a 0x00 terminator to stop. A
crafted $LogFile UpdateMappingPairs record whose embedded attribute
contains mapping-pairs runs without a terminator causes the function to
read past the slab allocation, triggering a KASAN slab-out-of-bounds
read on mount.
The sibling function run_unpack() received an analogous bounds-check in
commit b62567bca474 ("ntfs3: add buffer boundary checks to run_unpack()"),
but run_get_highest_vcn() was missed.
Take a run_buf_size parameter and reject any run header whose payload
would extend past the buffer end, mirroring the pattern used by
run_unpack(). The caller in fslog.c passes the remaining attribute
bytes after the mapping-pairs offset.
KASAN report (on mainline v7.1 merge window HEAD):
BUG: KASAN: slab-out-of-bounds in run_get_highest_vcn+0x3c0/0x410
Read of size 1 at addr ffff88800e2d5400 by task mount/72
Call Trace:
run_get_highest_vcn+0x3c0/0x410
do_action.isra.0+0x3ba8/0x7b50
log_replay+0x9ddd/0x10200
ntfs_loadlog_and_replay+0x4ad/0x610
ntfs_fill_super+0x214a/0x4540 |
| In the Linux kernel, the following vulnerability has been resolved:
fs/ntfs3: call _ntfs_bad_inode() when failing to rename
It is safe to call _ntfs_bad_inode on live inodes since:
commit 519b078998ce ("fs/ntfs3: Exclude call make_bad_inode for live nodes.")
The WARN_ON was added when it wasn't safe by:
commit d99208b91933 ("fs/ntfs3: cancle set bad inode after removing name fails")
Replace the WARN_ON with a call to _ntfs_bad_inode() to prevent further
operations on the inconsistent inode. |
| In the Linux kernel, the following vulnerability has been resolved:
dmaengine: Fix possible use after free
In dma_release_channel(), check chan->device->privatecnt after call
dma_chan_put(). However, dma_chan_put() call dma_device_put() which could
release the last reference of the device if the DMA provider is already
gone and hence free it.
Fixes it by moving dma_chan_put() after the check. |
| In the Linux kernel, the following vulnerability has been resolved:
dmaengine: dma-axi-dmac: Properly free struct axi_dmac_desc
Use axi_dmac_free_desc() to free fully the descriptor at fail path when
call axi_dmac_alloc_desc() in axi_dmac_prep_peripheral_dma_vec(). |
| In the Linux kernel, the following vulnerability has been resolved:
dmaengine: dma-axi-dmac: use DMA pool to manange DMA descriptor
For architectures like Microblaze or arm64 (where this IP is used),
DMA_DIRECT_REMAP is set which means that dma_alloc_coherent() might
remap (and hence vmalloc()) some memory. This became visible in a design
where dma_direct_use_pool() is not possible.
With the above, when calling dma_free_coherent(), vunmap() would be
called from softirq context and thus leading to a BUG().
To fix it, use a dma pool that is allocated in
.device_alloc_chan_resources() and allocate blocks from it. The key
point is that now dma_pool_free() is used in axi_dmac_free_desc() to
free the blocks and that just frees the blocks from the pool in the
sense they can be used again. In other words, no actual call to
dma_free_coherent() happens. That only happens when destroying the pool
in axi_dmac_free_chan_resources() which does not happen in any interrupt
context. |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Decouple req recycling from RPC completion
rl_kref formerly served two distinct lifetimes through a single
refcount: it gated when a Reply could wake its RPC task, and it
gated when an rpcrdma_req could return to its free pool. The
marshal path took the Send-side reference only when SGEs needed
DMA-unmap (sc_unmap_count > 0), which made a Send carrying only
pre-registered buffers an exception: the Reply handler dropped
rl_kref from 1 to 0 and freed the req while the HCA might still
be DMA-reading from its send buffer.
Give rl_kref a narrower job. The RPC layer takes one reference
when slot allocation hands a req out. rpcrdma_prepare_send_sges()
takes a Send-side reference unconditionally after WR preparation
succeeds. xprt_rdma_free_slot() and xprt_rdma_bc_free_rqst() drop
the RPC-layer reference; rpcrdma_sendctx_unmap() drops the
Send-side reference. The req returns to its free pool only after
both owners have signed off.
The existing kref_init(&req->rl_kref) call in
rpcrdma_prepare_send_sges() is removed. Initialization moves to
the slot-allocation paths (xprt_rdma_alloc_slot and
rpcrdma_bc_rqst_get), and the release callback re-arms rl_kref
before the req returns to a free pool. A re-init in the marshal
path would discard the RPC-layer reference that already exists
on entry.
Three invariants follow:
- Any rpcrdma_req held by an rpc_rqst has rl_kref >= 1.
xprt_rdma_alloc_slot(), rpcrdma_bc_rqst_get(), and the
backlog-wake branch in xprt_rdma_alloc_slot() each kref_init
rl_kref before publishing the req. Without this invariant,
an RPC task that aborts between slot allocation and marshal
(gss_refresh failure or signal during call_connect, for
example) would drive xprt_release() ->
xprt_rdma_free_slot() -> kref_put against a refcount of
zero, saturating refcount_t and stranding the slot.
- The Send-side reference is taken only after WR prep
succeeds. A mapping failure in rpcrdma_prepare_send_sges()
runs rpcrdma_sendctx_cancel(), which DMA-unmaps the sendctx
and clears sc_req without touching rl_kref. The sendctx
ring walks in rpcrdma_sendctx_put_locked() and
rpcrdma_sendctxs_destroy() skip entries with sc_req == NULL,
so a burst of -EIO marshal failures cannot hold reqs off
rb_send_bufs.
- The release callback re-arms rl_kref so the next consumer
enters with the invariant satisfied.
Replies now complete the RPC directly. rpcrdma_reply_handler()
calls rpcrdma_complete_rqst() in place of kref_put on the
non-LocalInv branch. The LocalInv branch already completes the
RPC from frwr_unmap_async() and is unaffected.
Because Send-side references can now outlive RPC completion,
connection teardown drains sendctx entries whose unsignaled
Sends never had a later signaled completion to walk the ring.
rpcrdma_sendctxs_destroy() walks the active range and runs
rpcrdma_sendctx_unmap() on each entry with a non-NULL sc_req
before the request buffers are reset, and is moved ahead of
rpcrdma_reqs_reset() in rpcrdma_xprt_disconnect() so the reqs
are still in their pre-reset state when the Send-side refs are
released.
The drain creates a teardown-ordering hazard on the backchannel
path. With the new lifetime, releasing a bc_prealloc req from
rpcrdma_req_release() re-adds it to bc_pa_list. The disconnect
in xprt_rdma_destroy() runs after xprt_destroy_backchannel() has
already emptied bc_pa_list, so the drained reqs would otherwise
leak. xprt_rdma_destroy() now runs xprt_rdma_bc_destroy(xprt, 0)
a second time after the disconnect to reclaim them. |
| In the Linux kernel, the following vulnerability has been resolved:
nfs: use nfsi->rwsem to protect traversal of the file lock list
Lingfeng identified a bug and suggested two solutions, but both appear
to have issues.
Generally, we cannot release flc_lock while iterating over the file lock
list to avoid use-after-free (UAF) problems with file locks. However,
functions like nfs_delegation_claim_locks and nfs4_reclaim_locks cannot
adhere to this rule because recover_lock or nfs4_lock_delegation_recall
may take a long time. To resolve this, NFS switches to using nfsi->rwsem
for the same protection, and nfs_reclaim_locks follows this approach.
Although nfs_delegation_claim_locks uses so_delegreturn_mutex instead,
this is inadequate since a single inode can have multiple nfs4_state
instances. Therefore, the fix is to also use nfsi->rwsem in this case.
Furthermore, after commit c69899a17ca4 ("NFSv4: Update of VFS byte range
lock must be atomic with the stateid update"), the functions
nfs4_locku_done and nfs4_lock_done also break this rule because they
call locks_lock_inode_wait without holding nfsi->rwsem. Simply adding
this protection could cause many deadlocks, so instead, the call to
locks_lock_inode_wait is moved into _nfs4_proc_setlk. Regarding the bug
fixed by commit c69899a17ca4 ("NFSv4: Update of VFS byte range
lock must be atomic with the stateid update"), it has been resolved
after commit 0460253913e5 ("NFSv4: nfs4_do_open() is incorrectly triggering
state recovery") because all slots are drained before calling
nfs4_do_reclaim, which prevents concurrent stateid changes along this path.
Also, nfs_delegation_claim_locks does not cause this concurrency either
since when _nfs4_proc_setlk is called with NFS_DELEGATED_STATE, no RPC is
sent, so nfs4_lock_done is not called. Therefore,
nfs4_lock_delegation_recall from nfs_delegation_claim_locks is the first
time the stateid is set. |
| In the Linux kernel, the following vulnerability has been resolved:
fs/ntfs3: prevent potential lcn remains uninitialized
The target VCN being sought was not found within runs[0], causing
run_lookup() to return false. This causes run_lookup_entry() to return
false, which in turn results in a len value of 0, and the new parameter
passed to attr_data_get_block() is NULL. Collectively, these factors
ultimately cause attr_data_get_block_locked() to exit prematurely without
initializing lcn, thereby triggering [1].
To prevent [1], the clen check within ni_seek_data_or_hole() has been
moved to occur before the lcn check.
[1]
BUG: KMSAN: uninit-value in ni_seek_data_or_hole+0x24f/0x5f0 fs/ntfs3/frecord.c:2862
ni_seek_data_or_hole+0x24f/0x5f0 fs/ntfs3/frecord.c:2862
ntfs_llseek+0x22a/0x4a0 fs/ntfs3/file.c:1530
vfs_llseek fs/read_write.c:391 [inline] |
| In the Linux kernel, the following vulnerability has been resolved:
fs/ntfs3: resize log->one_page_buf when adopting on-disk page size
log_replay() allocates log->one_page_buf using the page size that was
chosen from the host PAGE_SIZE:
log->one_page_buf = kmalloc(log->page_size, GFP_NOFS);
Later, when a restart area is found, the log page size recorded on disk
is adopted:
t32 = le32_to_cpu(log->rst_info.r_page->sys_page_size);
if (log->page_size != t32) {
log->l_size = log->orig_file_size;
log->page_size = norm_file_page(t32, &log->l_size,
t32 == DefaultLogPageSize);
}
If the on-disk page size is larger than the size used for the initial
allocation, log->page_size grows but one_page_buf is left at its
original, smaller size. A subsequent unaligned read_log_page() then
reads log->page_size bytes into the undersized scratch buffer:
page_buf = page_off ? log->one_page_buf : *buffer;
err = ntfs_read_run_nb_ra(ni->mi.sbi, &ni->file.run, page_vbo, page_buf,
log->page_size, NULL, &log->read_ahead);
overflowing the allocation. This is reachable when mounting a dirty
NTFS volume whose log was formatted with a page size larger than the
buffer initially allocated on the mounting host (for example a 64K-log
volume mounted on a host that allocated a 4K scratch buffer).
Grow one_page_buf when the adopted on-disk page size exceeds the size
used for the initial allocation. On krealloc() failure the original
buffer is left intact and freed by the existing error path. |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Fix ep kref imbalance on ADDR_CHANGE
rpcrdma_cm_event_handler() falls through to the disconnected: label
on RDMA_CM_EVENT_ADDR_CHANGE and calls rpcrdma_ep_put() with no
matching get when the event arrives before RDMA_CM_EVENT_ESTABLISHED.
The kref then underflows during connect teardown and
rpcrdma_xprt_disconnect() operates on a freed ep.
Reference counts across a normal connection lifecycle:
rpcrdma_ep_create() kref_init ->1
rpcrdma_xprt_connect() ep_get ->2 (before post_recvs)
RDMA_CM_EVENT_ESTABLISHED ep_get ->3
RDMA_CM_EVENT_DISCONNECTED ep_put ->2
rpcrdma_xprt_drain() ep_put ->1
rpcrdma_xprt_disconnect() tail ep_put ->0 (ep_destroy)
The connect-time get in rpcrdma_xprt_connect(), taken just before
rpcrdma_post_recvs() "while there are outstanding Receives," is
balanced by rpcrdma_xprt_drain. ADDR_CHANGE before ESTABLISHED has
no get to consume, so its put drops the count to 1 and the drain
put then frees the ep while rpcrdma_xprt_disconnect() still holds a
pointer to it.
Fix by dispatching on the prior re_connect_status via xchg(): for
prev == 0 (pre-ESTABLISHED) wake the connect waiter and return with
no put; for prev == 1 call rpcrdma_force_disconnect() and return.
The case-1 arm relies on the subsequent RDMA_CM_EVENT_DISCONNECTED
event -- reliably delivered when rdma_disconnect() is called on a
still-connected cm_id -- to balance the ESTABLISHED get;
rpcrdma_xprt_drain() continues to balance only that connect-time
get. Any other prior value means teardown is already in flight. |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Initialize re_id before removal registration
rpcrdma_create_id() registers ep->re_rn with the rpcrdma ib_client
before returning the new rdma_cm_id to rpcrdma_ep_create(). However
rpcrdma_ep_create() currently stores that pointer in ep->re_id only
after rpcrdma_create_id() returns.
A local administrator can race an NFS/RDMA mount against RDMA device
removal. If rpcrdma_remove_one() observes the just-registered
notification before rpcrdma_ep_create() assigns ep->re_id,
rpcrdma_ep_removal_done() calls trace_xprtrdma_device_removal(NULL).
The tracepoint dereferences id->device->name and copies
id->route.addr.dst_addr, so the callback can crash the kernel with a
NULL pointer dereference.
Store the rdma_cm_id in ep->re_id immediately before publishing
ep->re_rn. The existing error path still destroys the id directly if
registration fails; ep is then freed by the caller without using
ep->re_id. Remove the later duplicate assignment in rpcrdma_ep_create(). |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Check frwr_wp_create() during connect
frwr_wp_create() creates the singleton Memory Region used to encode
padding for Write chunks whose payload length is not XDR-aligned. Its
failure paths return a negative errno and leave ep->re_write_pad_mr set
to NULL.
rpcrdma_xprt_connect() currently ignores that return value. If
frwr_wp_create() fails after the rest of the connection setup succeeds,
xprt_rdma_connect_worker() treats the connection attempt as successful
and sets XPRT_CONNECTED. A later NFS/RDMA read with a non-4-byte-aligned
receive page length reaches rpcrdma_encode_write_list(), passes the NULL
write-pad MR to encode_rdma_segment(), and dereferences it.
This is locally triggerable on an NFS/RDMA client after a connect or
reconnect hits a local MR allocation, DMA-map, MR-map, or post-send
failure; a remote peer alone cannot force the local MR setup failure.
Check the return value and fail the connect as -ENOTCONN, matching the
adjacent setup failures. This keeps XPRT_CONNECTED clear and lets the
normal reconnect path retry. |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Fix bcall rep leak and unbounded peek
rpcrdma_is_bcall() decodes a reply's first words to decide whether
the frame is a backchannel call. Two issues in that decode path
let a short or malformed reply leak the receive buffer and drain
the Receive queue.
First, the speculative peek
p = xdr_inline_decode(xdr, 0);
/* five p++ reads follow */
asks xdr_inline_decode() for zero bytes, which returns xdr->p
without consulting xdr->end. The five subsequent __be32 reads can
then walk up to 20 bytes past the wire payload into stale regbuf
contents and misclassify the reply as a backchannel call.
Second, after the post-peek
p = xdr_inline_decode(xdr, 3 * sizeof(*p));
if (unlikely(!p))
return true;
the short-header arm returns true without calling
rpcrdma_bc_receive_call(). The contract with the caller is that a
true return transfers ownership of rep to the backchannel path:
rpcrdma_reply_handler()
if (rpcrdma_is_bcall(r_xprt, rep))
return; /* bare return, skips out_post */
...
out_post:
rpcrdma_post_recvs(r_xprt, credits + ...);
Because rpcrdma_bc_receive_call() never ran, no one took rep, but
rpcrdma_reply_handler still bare-returns past rpcrdma_rep_put()
and rpcrdma_post_recvs(). The rep, with its persistently
DMA-mapped receive buffer, is orphaned on rb_all_reps and freed
only at transport teardown. This completion reposts nothing, so
its slot is reclaimed only when a later forward-channel reply
reaches out_post and rpcrdma_post_recvs() allocates a fresh rep to
backfill; absent that traffic the Receive queue drains and the
peer's Sends draw RNR NAKs.
Fix by consulting xdr->end after the zero-length peek so the five
__be32 reads cannot run unless 20 bytes of wire payload remain. A
byte-precise comparison against xdr->end is required because a
non-4-aligned receive rounds the stream's word count up past the
true payload. Also return false from the short-header arm so the
reply falls through the normal out_norqst cleanup chain
(rpcrdma_rep_put() plus rpcrdma_post_recvs()). |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Sanitize the reply credit grant after parsing
The out_norqst exit in rpcrdma_reply_handler() branches away before
the credit clamp, so a reply that matches no pending request reaches
out_post carrying the raw credit value parsed from the wire.
rpcrdma_post_recvs() does not bound its @needed argument: the refill
loop allocates and chains Receive WRs until the count is satisfied or
allocation fails. A peer that sends a well-formed reply carrying an
unknown XID and an inflated credit grant therefore drives rep
allocation and Receive posting past re_max_requests on every such
reply.
Move the clamp to immediately after the credit field is parsed,
ahead of the first branch that can reach out_post, so every later
consumer sees a sanitized value. The cwnd update stays on the
matched-request path. |
| In the Linux kernel, the following vulnerability has been resolved:
xprtrdma: Repost Receive buffers for malformed replies
rpcrdma_wc_receive() decrements the transport's Receive count for
every completion before it dispatches a successful Receive to
rpcrdma_reply_handler(). The handler must post a replacement
Receive WR before returning unless ownership of the rep has moved
elsewhere, as on the backchannel path.
Commit 2ae50ad68cd7 ("xprtrdma: Close window between waking RPC
senders and posting Receives") moved the Receive refill out of
rpcrdma_wc_receive(), where it had run ahead of every reply, into
rpcrdma_reply_handler() so that the responder's credit grant could
be parsed before reposting. The bad-version and short-reply exits
never reach that refill: they recycle the rep and return without
calling rpcrdma_post_recvs().
A remote peer can therefore drain the client's posted Receive
queue by sending a sustained stream of replies that are shorter
than the fixed transport header or that carry an unrecognized
RPC/RDMA version. Each such reply consumes one posted Receive
without replacing it. Once the queue empties, the peer's next
Send finds no posted Receive and the transport stalls until
reconnect.
Route both malformed-reply exits through the shared repost tail
after recycling the rep, refilling against buf->rb_credits, the
most recent accepted credit grant. Neither exit updates the
congestion window, so RPCs admitted under the previous grant
remain in flight awaiting replies. A smaller refill target would
let a stream of malformed replies ratchet the posted Receive count
down to the batch floor while the congestion window still admits
rb_credits RPCs; a burst of valid replies to those RPCs could then
overrun the posted Receives, and because the client connects with
rnr_retry_count of zero, a single RNR NAK terminates the
connection. Refilling against rb_credits also restores the target
that applied to malformed replies before commit 2ae50ad68cd7
("xprtrdma: Close window between waking RPC senders and posting
Receives") when rpcrdma_post_recvs() computed it from rb_credits
internally. rb_credits is at least one from connection
establishment onward, so the repost path always keeps Receives
posted. |
| In the Linux kernel, the following vulnerability has been resolved:
xfrm: Fix dev use-after-free in xfrm async resumption
xfrm async resumption hold skb->dev refcnt until after transport_finish.
However, xfrm_rcv_cb may modify skb->dev to tunnel dev without taking
device reference, such as vti_rcv_cb. The subsequent async resumption
will decrement the tunnel device's reference count, which lead to uaf
of tunnel dev and refcnt leak of orig dev as below:
unregister_netdevice: waiting for vti1 to become free. Usage count = -2
Stash the original skb->dev to fix refcnt imbalance. The new skb->dev set
by xfrm_rcv_cb can race with device teardown. Extend rcu protection over
xfrm_rcv_cb and transport_finish to prevent races. |
| In the Linux kernel, the following vulnerability has been resolved:
apparmor: fix race in unix socket mediation when peer_path is used
The holding a reference to the peer_sk is not enough to ensure access
to the peer sk path. Accessing the path outside of the state lock
allows for a race with unix_release_sock(). Fix this by taking the
state lock and getting a reference to the path under lock.
Ideally for connected sockets we would cache this information so we
don't have to take the lock here. But for now just fix the race. |
