| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| 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: 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. |
| In the Linux kernel, the following vulnerability has been resolved:
apparmor: aa_label_alloc use aa_label_free on alloc failure
aa_label_alloc() allocates a secid before allocating or taking the label
proxy. If the later proxy step fails, the error path only freed the label
memory, leaking any resources initialized by aa_label_init().
Use aa_label_free() on the failure path so partially initialized labels
release their secid and other label resources before the backing memory is
freed. |
| In the Linux kernel, the following vulnerability has been resolved:
apparmor: fail policy unpack on accept2 allocation failure
unpack_pdb() may need to allocate a missing ACCEPT2 table for older policy
data. If that allocation failed, it set an error message but jumped to the
success path, returning a policydb with the required table missing.
Return -ENOMEM through the normal failure path when the ACCEPT2 allocation
fails. Remove the now-unused out label. |
| In the Linux kernel, the following vulnerability has been resolved:
i3c: mipi-i3c-hci: Fix race in i3c_hci_addr_to_dev()
i3c_hci_addr_to_dev() walks bus->devs.i3c, which is protected by
bus.lock (rwsem). However, it is invoked from the MIPI I3C HCI IRQ
handler, which cannot take bus.lock. This allows concurrent device
addition/removal in the I3C core to modify the list while it is being
traversed, potentially leading to use-after-free or crashes.
Remove the dependency on the bus device list and introduce a dedicated
lookup table. Add an ibi_devs[] array indexed by DAT entry, maintained
under hci->lock. Update the array when IBIs are enabled or disabled,
so that it always reflects the set of devices allowed to generate IBIs.
Also update when IBIs are freed, to cover the corner case when an IBI is
freed without first being disabled (e.g. oldedev in
i3c_master_add_i3c_dev_locked()).
Move i3c_hci_addr_to_dev() into core.c, reimplement it using the new
array, and add a lockdep assertion to enforce that hci->lock is held
by callers.
Demote a message in PIO and DMA IBI handling, from an error to a debug
message, because there is a race window when the condition can arise
normally. |
| In the Linux kernel, the following vulnerability has been resolved:
regcache: Do not overwrite error code when finalizing cache after error
During regcache initialization, if an error occurs in the
cache_ops->populate callback, and if cache operations include an exit
callback, the error code from populate() is overwritten with the return
value from exit(). This hides the error condition from the caller of
regcache_init(), and can cause NULL pointer dereferences when the regcache
is later accessed. |
| In the Linux kernel, the following vulnerability has been resolved:
xfrm: validate selector family and prefixlen during match
syzbot reported a shift-out-of-bounds in xfrm_selector_match()
due to AF_UNSPEC selector with large prefixlen (e.g. 128) matched
against IPv4 flow (when XFRM_STATE_AF_UNSPEC is set).
Fix this by:
- Rejecting mismatched families in xfrm_selector_match.
- Returning false in addr4_match if prefixlen > 32.
- Returning false in addr_match if prefixlen > 128 (prevents overflow). |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amdkfd: fix list_del corruption in kfd_criu_resume_svm
The cleanup tail of kfd_criu_resume_svm() walks
svms->criu_svm_metadata_list and kfree()s each struct criu_svm_metadata
without removing it from the list. The list head is left pointing at
freed kmalloc-96 objects.
A second AMDKFD_IOC_CRIU_OP from the same process re-enters: list_empty()
reads the dangling ->next (use-after-free), the loop walks freed entries,
and each is kfree()'d again (double-free). This is reachable by an
unprivileged render-group user via /dev/kfd with no capabilities required.
Add list_del() before the kfree() so the list is properly emptied. The
list_for_each_entry_safe() iterator already caches the next pointer, so
unlinking during the walk is safe.
(cherry picked from commit 6322d278a298e2c1430b9d2697743d3a04b788b1) |
| In the Linux kernel, the following vulnerability has been resolved:
sctp: hold socket lock when dumping endpoints in sctp_diag
SCTP_DIAG endpoint dumping was traversing endpoint address lists without
holding lock_sock(), while those lists could change concurrently via
socket operations (e.g., bindx changes). This creates a race where
nla_reserve() counts addresses under RCU protection, but the subsequent
copy may see fewer entries, potentially leaking uninitialized memory to
userspace.
Fix this by:
- Taking a reference on each endpoint during hash traversal
- Moving socket operations (lock_sock()) outside read_lock_bh()
- Serializing address list access during dump
- Reworking sctp_for_each_endpoint() to support restart-based traversal
with (net, pos) tracking
Also:
- Add WARN_ON_ONCE() for inconsistent address counts
- Fix idiag_states filtering for LISTEN vs association cases
- Skip dumping endpoints being freed (ep->base.dead)
- Move dump position tracking into iterator, removing cb->args[4] and
its comment for sctp_ep_dump().,
- Update the comment for cb->args[4] and remove the comment for unused
cb->args[5] for sctp_sock_dump().
Note: traversal is restart-based and may re-scan buckets multiple times,
but this is acceptable due to small bucket sizes and required to support
sleeping-safe callbacks.
This issue was reported by Nico Yip (@_cyeaa_) working with TrendAI Zero
Day Initiative. |
| In the Linux kernel, the following vulnerability has been resolved:
ALSA: usb-audio: qcom: clear opened when stream enable fails
On enable, subs->opened is set before the service_interval is validated;
an invalid interval jumps to the response label without clearing it, so
the substream is wedged at -EBUSY until a disable or disconnect.
Clear subs->opened on the enable error path. |
| In the Linux kernel, the following vulnerability has been resolved:
flow_dissector: check device type before reading ETH_ADDRS
__skb_flow_dissect() unconditionally reads 12 bytes from eth_hdr(skb)
when FLOW_DISSECTOR_KEY_ETH_ADDRS is requested. This assumes the skb
has a valid Ethernet header at mac_header, which is not always the case.
The problem can be triggered by:
1. Creating a TUN device in L3 mode (IFF_TUN, hard_header_len=0)
2. Attaching a multiq qdisc with a flower filter matching on eth_src
3. Sending a packet through AF_PACKET
Since TUN in L3 mode has no link-layer header, mac_header points to
the L3 data area. The flow dissector reads 12 bytes of uninitialized
skb memory, which then propagates through fl_set_masked_key() and is
used as a rhashtable lookup key in __fl_lookup(), as reported by KMSAN.
Rejecting the filter in the control path (at tc filter add time) is
not feasible because TC filter blocks can be shared between arbitrary
devices -- a filter installed on an Ethernet device may later classify
packets on a headerless device through a shared block. The device
association is not fixed at filter creation time.
Fix this by gating the memcpy on dev->type == ARPHRD_ETHER, which
ensures only true Ethernet-framed packets have their addresses read.
This is more precise than the previous hard_header_len >= 12 check,
which would incorrectly pass for non-Ethernet link types like IPoIB
(ARPHRD_INFINIBAND, hard_header_len=24) and FDDI (hard_header_len=21)
whose L2 headers are not in Ethernet format. Additionally check
skb_mac_header_was_set() to guard against the pathological case where
mac_header is the unset sentinel (~0U), which would cause eth_hdr() to
return a wild pointer.
For the act_mirred redirect case (Ethernet packet redirected to a
non-Ethernet device sharing a TC block), zeroing the key is the correct
behavior: the packet is now being classified on the target device, where
Ethernet address matching is not semantically meaningful.
Note: on non-Ethernet devices, the zeroed key will match a filter
configured with all-zero MAC addresses. This is an improvement over the
previous behavior where uninitialized memory could randomly match any
filter. |
| In the Linux kernel, the following vulnerability has been resolved:
ALSA: usb-audio: Kill MIDI 2.0 URBs before freeing endpoints
MIDI 2.0 input URBs are started during snd_usb_midi_v2_create(). A
later setup failure can still jump to snd_usb_midi_v2_free(), which
currently frees each endpoint and its coherent URB buffers without first
stopping the submitted URBs. A completion can then dereference the
embedded URB context and endpoint state after they have been freed, or
try to resubmit from the stale endpoint.
This was observed as a KASAN slab-use-after-free in
input_urb_complete().
The buggy scenario involves two paths, with each column showing the order
within that path:
probe error path: USB completion path:
1. start_input_streams() submits 1. The HCD still owns a
input URBs. submitted input URB.
2. A later setup helper returns 2. input_urb_complete() runs
an error. with urb->context in ep.
3. snd_usb_midi_v2_free() frees 3. The completion reads ep
endpoint storage and URB buffers. state and can requeue URBs.
Make the endpoint destructor follow the same teardown ordering used for
disconnect when the endpoint has not already been disconnected: publish
ep->disconnected, kill the URBs synchronously, and drain the endpoint
before freeing URB buffers and endpoint storage. The guard avoids
repeating the stop sequence after the normal
snd_usb_midi_v2_disconnect_all() path, while still synchronizing the
direct MIDI 2.0 create-error free path.
Validation reproduced this kernel report:
BUG: KASAN: slab-use-after-free in input_urb_complete+0x37/0x1b0
Workqueue: usb_hub_wq hub_event
RIP: 0010:_raw_spin_unlock_irq+0x2e/0x50
Read of size 8
Call trace:
dump_stack_lvl+0x77/0xb0
print_report+0xce/0x5f0
input_urb_complete+0x37/0x1b0 (sound/usb/midi2.c:186)
srso_alias_return_thunk+0x5/0xfbef5
__virt_addr_valid+0x19f/0x330
kasan_report+0xe0/0x110
__usb_hcd_giveback_urb+0x112/0x1d0
dummy_timer+0xaaa/0x19a0
lock_is_held_type+0x9a/0x110
__lock_acquire+0x467/0x28b0
mark_held_locks+0x40/0x70
_raw_spin_unlock_irqrestore+0x44/0x60
lockdep_hardirqs_on_prepare+0xbb/0x1a0
__hrtimer_run_queues+0x101/0x520
hrtimer_run_softirq+0xd0/0x130
handle_softirqs+0x15b/0x670
__irq_exit_rcu+0xd0/0x170
irq_exit_rcu+0xe/0x20
sysvec_apic_timer_interrupt+0x6c/0x80
asm_sysvec_apic_timer_interrupt+0x1a/0x20 |
