| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
ovpn: defer key slot crypto freeing to workqueue
Key slots are released through a kref and the existing release path
frees the AEAD transforms from an RCU callback. That is not safe for all
crypto implementations: crypto_free_aead can sleep, for example when an
async or hardware implementation has teardown work to complete.
Use queue_rcu_work for key-slot release. This keeps the RCU grace period
needed by lockless key-slot readers, but runs the actual crypto teardown
from workqueue context where sleeping is allowed. Once the rcu_work
callback runs, pre-existing RCU readers are gone, and the final kref put
already proves that no transform user remains, so the worker can release
the AEAD transforms and free the slot directly.
The previous patch drains ovpn_wq during module exit, so queued key-slot
teardown work cannot outlive module text. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/amdgpu: disallow multiple FENCE chunks in one submit
amdgpu_cs_pass1() dispatches on chunk_id once per chunk without
rejecting repeated ids. p->uf_bo is a single-slot field, so a
submission carrying two AMDGPU_CHUNK_ID_FENCE chunks runs
amdgpu_cs_p1_user_fence() twice, and the second run overwrites
p->uf_bo with a freshly referenced BO without dropping the reference
taken by the first.
amdgpu_cs_parser_fini() only unrefs the final p->uf_bo, so every FENCE
chunk but the last leaks a BO reference. The leaked BO outlives handle
close and process exit.
Reject duplicate FENCE chunks the same way commit fec5f8e8c6bc
("drm/amdgpu: disallow multiple BO_HANDLES chunks in one submit") did
for p->bo_list.
(cherry picked from commit 665b1fc2a1845206408f9a2c6da67101789edb82) |
| In the Linux kernel, the following vulnerability has been resolved:
s390/zcrypt: Improve EP11 CPRB length and overflow checks
The xcrb_msg_to_type6_ep11cprb_msgx() function lacks proper input
validation, creating security vulnerabilities:
1. Missing minimum size validation: The ep11_cprb structure and
subsequent payload fields (pld_tag, pld_lenfmt) are copied from
userspace without verifying sufficient buffer length.
2. Arithmetic overflow in length calculations: CEIL4 alignment could
overflow, bypassing size checks and enabling buffer overflows.
3. The payload is asn1 encoded but the function just uses a simple c
struct overlay to access some fields of the payload.
Fix by using size_t for length calculations, adding U32_MAX boundary
checks after alignment, and validating minimum request size and
minimum reply size before copying from userspace. Do a very simple
asn1 parsing of the payload up to the function value field. |
| In the Linux kernel, the following vulnerability has been resolved:
s390/vfio_ccw: Selectively expand io_mutex
The io_mutex was defined to serialize the io_regions, but then has
also sort of been associated with the I/O themselves because of
the close relationship they share.
With the handful of races that are possible, the choices are either to:
A) expand the scope of io_mutex to close these remaining windows, or
B) reduce the scope of io_mutex to just io_region, and introduce a new
lock mechanism for the remaining I/O resources
This patch implements A, since B brings with it a lot more interactions
that would need to be tracked and kept in a correct hierarchy. It also
takes advantage of the workqueue element for cp_free() that now gets
called out of fsm_notoper(), which could be invoked out of an interrupt
context and thus cannot acquire a mutex itself. |
| In the Linux kernel, the following vulnerability has been resolved:
openrisc: signal: do not restore privileged SR bits on sigreturn
restore_sigcontext() copies the whole supervision register (SR) from the
signal frame and only clears SPR_SR_SM before the value is reloaded into
the hardware SR (through ESR and l.rfe) on the return to user space. All
other SR bits are left under user control.
An unprivileged task can thus return from a signal handler through a
crafted sigframe that clears SPR_SR_DME. With the data MMU disabled the
CPU performs no translation or protection on data accesses, so the task
gains read and write access to arbitrary physical memory, a local
privilege escalation. SPR_SR_IME, SPR_SR_SUMRA, SPR_SR_LEE, SPR_SR_EPH
and the cache-enable bits are exposed the same way. The ptrace GPR regset
already refuses any change to SR for exactly this reason.
Restore only the arithmetic flag bits (F, CY, OV) from the signal frame
and take every privileged control bit from the SR the kernel saved on
signal entry.
Verified with qemu-system-or1k -M or1k-sim: before this change an
unprivileged PoC clears SPR_SR_DME in rt_sigreturn and writes a marker to
physical address 0x03000000 (beyond the kernel's mem=32M); afterwards the
same PoC receives SIGSEGV and physical memory is unchanged. |
| In the Linux kernel, the following vulnerability has been resolved:
libceph: fix multiple unsafe decodes in decode_locker()
decode_locker() in cls_lock_client.c contains three unsafe decode
operations that allow a malicious or compromised OSD to trigger
slab-out-of-bounds reads:
1. ceph_decode_copy() at the locker_id_t name field has no preceding
bounds check. With p == end after ceph_start_decoding() accepts
struct_len=0, this reads sizeof(ceph_entity_name) = 9 bytes past
the validated buffer boundary.
2. *p += sizeof(struct ceph_timespec) after the locker_info_t header
is an unchecked pointer advance. A malicious OSD can position p
past end, causing all subsequent _safe checks to pass against a
bogus boundary.
3. len = ceph_decode_32(p) has no preceding bounds check, and the
immediately following *p += len is uncapped. A malicious OSD can
send len=0xffffffff, advancing p gigabytes past end and escaping
the decode window entirely.
Fix all three by replacing bare operations with their safe variants:
ceph_decode_copy -> ceph_decode_copy_safe
*p += sizeof(...) -> ceph_decode_skip_n
ceph_decode_32(p) -> ceph_decode_32_safe
*p += len -> ceph_decode_skip_n
A new label is added to return -EINVAL on any bounds violation.
-EINVAL is appropriate here: the data received from the OSD
is structurally malformed, which is an invalid argument to the decode
contract regardless of whether the caller or the wire is at fault.
Attacker model: a malicious or compromised OSD in a multi-tenant Ceph
deployment can trigger this against any kernel client that issues the
lock.get_info class method (e.g. during RBD exclusive lock acquisition)
without any further privileges beyond OSD session establishment.
[ idryomov: use ceph_decode_skip_string() to skip description, trim
changelog ] |
| In the Linux kernel, the following vulnerability has been resolved:
Input: synaptics-rmi4 - propagate F54 worker errors to V4L2 queue
Previously, rmi_f54_buffer_queue() waited for the worker thread to
finish but ignored whether it succeeded. If the worker failed (e.g.,
due to a timeout or register read failure), the queue thread would
silently return success, delivering stale or uninitialized memory to
userspace.
Add a 'report_error' field to struct f54_data to store the worker's exit
status. Check this field in rmi_f54_buffer_queue() after the worker
finishes, and mark the buffer as VB2_BUF_STATE_ERROR if an error
occurred. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/panthor: skip zero-sized firmware sections
panthor_fw_load_section_entry() skips BO creation when the firmware section
VA range is empty. If such a section is added to the firmware section list,
section->mem is left as NULL.
Later reload and unplug paths iterate over all firmware sections and
dereference section->mem, which can lead to a NULL pointer dereference.
Zero-sized firmware sections are valid, so accept them as no-op entries but
skip adding them to the section list. |
| In the Linux kernel, the following vulnerability has been resolved:
ASoC: SOF: ipc4-pcm: Continue the pipeline trigger in case of IPC timeout
Ignore IPC errors for pipeline state change if the firmware state is
crashed or the IPC has timed out.
If the firmware has crashed the kernel still needs to go through the state
changes to reset its internal to be able to correctly work the next time
the DSP is booted up.
The case with IPC timeout is a bit more problematic, but it has been
rootcaused to be the result of system scheduling blockage and the firmware
did actually received and handled the message, but the reply handling got
blocked by issues outside of the SOF stack.
So far the best way to handle this is to continue with setting the state. |
| In the Linux kernel, the following vulnerability has been resolved:
s390/qeth: validate user buffer length in SNMP and ARP query ioctls
qeth_snmp_command() and qeth_l3_arp_query() allocate a buffer sized by
a user-supplied length (udata_len) without checking a lower bound, then
set udata_offset to a fixed non-zero value and pass both to a reply
callback. The callback bounds-checks the copy with
if ((udata_len - udata_offset) < len)
Both fields are u32, so a udata_len smaller than udata_offset makes the
subtraction wrap and the check pass, and the following memcpy() writes
past the allocation. A udata_len of 0 also yields ZERO_SIZE_PTR from
kzalloc(), which the existing NULL check does not catch.
Reject buffers smaller than udata_offset before allocating, so the
callback subtraction can no longer underflow. |
| In the Linux kernel, the following vulnerability has been resolved:
mptcp: fastopen: only mark MPTFO subflows with SYN data
Passive TCP Fast Open accepts a valid-cookie SYN even when it carries
no data. In that case the child socket's receive queue is intentionally
left empty.
mptcp_fastopen_subflow_synack_set_params() set is_mptfo before checking
for queued SYN data. That made data-less TFO SYNs hit a WARN and, if
the warning was non-fatal, left stale MPTFO state behind. The stale
flag could later trigger a state-confusion bug in
check_fully_established().
Only mark the subflow as MPTFO after confirming that an SKB was queued.
Return quietly when the receive queue is empty.
Note that mptcp_subflow_context's is_mptfo field is now not just about
subflows where the TFO was present, but about MPTFO subflow that
consumed SYN data. Only having a valid cookie but not carrying data is
not really "doing TFO". |
| In the Linux kernel, the following vulnerability has been resolved:
mptcp: avoid combining some incoming suboptions
Some MPTCP suboptions are mutually exclusive according to the RFC8684,
but also because in different places, the code doesn't expect some
combinations to be present. That's specially true for suboptions that
would be present twice, but with different attributes.
The new restrictions are the same as the ones applied on the output
side, with mptcp_write_options. The same rules can be reused with a
small fix: an MP_FASTCLOSE can be used with a DSS when the sender picks
this option [1], which is not the case on Linux. Here are the rules:
Which options can be used together?
X: mutually exclusive
O: often used together
C: can be used together in some cases
P: could be used together but we prefer not to (optimisations)
| Opt: | MPC | MPJ | DSS | ADD | RM | PRIO | FAIL | FC |
|------|------|------|------|------|------|------|------|------|
| MPC |------|------|------|------|------|------|------|------|
| MPJ | X |------|------|------|------|------|------|------|
| DSS | X | X |------|------|------|------|------|------|
| ADD | X | X | P |------|------|------|------|------|
| RM | C | C | C | P |------|------|------|------|
| PRIO | X | C | C | C | C |------|------|------|
| FAIL | X | X | C | X | X | X |------|------|
| FC | X | X | P | X | X | X | X |------|
| RST | X | X | X | X | X | X | O | O |
|------|------|------|------|------|------|------|------|------|
The only difference is with the 'P': another stack could send and
ADD_ADDR with other suboptions (DSS, RM_ADDR), and this should be
allowed.
A few points of attention:
- In theory, an MP_CAPABLE could be used with a RM_ADDR, but there is
no reason to add it with a SYN. Note that even with a 4th ACK, it
doesn't seem to be useful, except when IDs are known in advance via
another channel. Better not to break that.
- Now, combining both an MP_CAPABLE and an MP_JOIN will no longer
result to a reject of the two options, but only the second suboption
is ignored. That seems OK to do that for this unexpected error. At
least now all inconsistent combinations are handled the same way.
This could change later in next. This also means the explicit checks
for having both MPC + MPJ in subflow.c will now be unreachable.
That's fine, they will be removed in a follow-up patch.
- In case of conflicting combinations, the extra suboption(s) is/are
ignored: having such combinations either means the remote peer is
buggy, or is evil. The simplest action is then taken in this case:
stop processing the current suboption.
- In mp_opt->suboptions, there is also a bit reserved to the checksum,
which can be used in an MP_CAPABLE and a DSS. Each time a DSS option
can be used in parallel with another option, the checksum can be set,
so the verification is combined into a new OPTIONS_MPTCP_DSS macro.
- An MP_CAPABLE ACK can carry a Data-Level Length, and an optional
Checksum: they are the same as the ones found in a DSS, because a DSS
cannot be used in parallel to an MP_CAPABLE. Similarly, even if there
is room, a DSS cannot be used with an MP_JOIN. |
| In the Linux kernel, the following vulnerability has been resolved:
mptcp: reclaim forward-allocated memory on RX path errors
After commit 9db5b3cec4ec ("mptcp: borrow forward memory from subflow"),
errors in the receive path prior to queueing skbs into the receive
queue do not trigger forward-allocated memory reclaiming.
Prevent forward memory from growing unboundedly in pathological drop
scenarios by explicitly reclaiming memory when skbs are dropped. |
| In the Linux kernel, the following vulnerability has been resolved:
block: stop the timeout timer when releasing a never added disk
disk_release() undoes blk_mq_init_allocated_queue() for a disk whose
probe failed before add_disk(), but it only calls blk_mq_exit_queue().
Nothing there stops q->timeout, and that timer rolls forward: it stays
pending until it next expires, not until the last request completes.
So if the driver issued any I/O before adding the disk, the
request_queue is freed while still linked into a timer wheel bucket.
Commit 6f8191fdf41d ("block: simplify disk shutdown") dropped the
blk_cleanup_queue() call that used to stop it. __del_gendisk() and
blk_mq_destroy_queue() still do; only the probe failure path lost it.
nvme gets there because nvme_update_ns_info() submits Report Zones or
FDP io-mgmt-recv on ns->queue before the disk is added, so a later
failure - a concurrent reset setting NVME_CTRL_FROZEN, or
device_add_disk() failing - lands in put_disk() with the timer armed:
BUG: KASAN: slab-use-after-free in detach_if_pending+0x30c/0x340
Write of size 8 at addr ffff888004d71310 by task kworker/u8:2/37
__timer_delete_sync+0x156/0x240 kernel/time/timer.c:1621
blk_sync_queue+0x22/0x40 block/blk-core.c:222
nvme_sync_queues+0x100/0x150 drivers/nvme/host/core.c:5362
nvme_reset_work+0x138/0x930 drivers/nvme/host/pci.c:3264
Allocated by task 34:
__blk_mq_alloc_disk+0x33/0x100 block/blk-mq.c:4462
nvme_alloc_ns+0x290/0x3870 drivers/nvme/host/core.c:4146
Freed by task 0:
blk_free_queue_rcu+0x3a/0x50 block/blk-core.c:254
rcu_core+0xc10/0x1730 kernel/rcu/tree.c:2857
The queue being synced there is ctrl->admin_q, only a victim sharing a
timer wheel bucket with the freed queue's dangling entry; other runs
tripped in enqueue_timer(), __run_timers() or blk_mq_timeout_work().
Failing nvme_alloc_ns() with a debug patch makes it deterministic: one
leaked timer trips KASAN within seconds, while 1987 patched releases
produced no splat.
Stop the timer and the queue work items before blk_mq_exit_queue(), like
blk_mq_destroy_queue() does.
Found by FuzzNvme. |
| Use after free in Chromoting in Google Chrome prior to 152.0.7977.65 allowed a remote attacker to potentially execute arbitrary code outside the sandbox via crafted network traffic. (Chromium security severity: Medium) |
| Race condition in Enterprise in Google Chrome on on Windows prior to 152.0.7977.65 allowed an adjacent attacker to potentially execute arbitrary code outside the sandbox via crafted network traffic. (Chromium security severity: Low) |
| This CVE ID has been rejected or withdrawn by its CVE Numbering Authority. |
| An Unchecked Input for Loop Condition vulnerability in the Packet Forwarding Engine (pfe) of Juniper Networks Junos OS on MX Series allows an unauthenticated, adjacent attacker to cause a Denial-of-Service (DoS).Micro-BFD session flaps generate respective up/down events which are queued by PFEMAN for processing. Especially in a Virtual-Chassis (VC) scenario with locality‑bias configured, processing takes a significant amount of time for each event. If these sessions keep flapping, new events are constantly added, and in turn PFEMAN never completes processing these events. This results in the PFEMAN watchdog timer expiring, which causes the FPC to crash and restart, representing a complete service outage.
This issue only affects MX series FPCs up to and including MPC9, and LC2101/2103 and LC480. It does not affect MPC10/11, LC4800/9600, and MX304.
This issue affects Junos OS on MX Series:
* all versions before 23.2R2-S7,
* 23.4 versions before 23.4R2-S8,
* 24.2 versions before 24.2R2-S4,
* 24.4 versions before 24.4R2-S3,
* 25.2 versions before 25.2R2. |
| LcpDecodeConfig() did not validate the length of received endpoint discriminator options against the minimum required by RFC 1717. Undersized options would trigger an out-of-bounds write.
A malicious PPP peer can exploit CVE-2026-58095 and CVE-2026-58096 to crash ppp(8) or potentially execute arbitrary code as root. |
| The implementation of this ioctl attempts to acquire locks on all channels in a sync group. If locking a channel would block, it releases the sync group list lock and sleeps. Upon reawakening, it is possible that the sync group structure is freed, but the implementation did not handle this possibility.
On a system with a multiple audio devices, an unprivileged local user can exploit this use-after-free to escalate privileges. |
