| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Preserve special fields in recycled rhtab elements
rhtab_map_update_elem() initializes special fields after obtaining an
element from bpf_mem_cache_alloc(). The allocator can return a fresh,
zeroed unit, or recycle one from its RCU-pending lists before the
registered destructor has run.
A BPF program can retain a map-value pointer after deleting its element
and initialize and arm a timer through that pointer. If the deleted unit
is recycled, check_and_init_map_value() clears the only pointer to the
timer. Neither a later deletion nor rhtab_mem_dtor() can then cancel it,
and the callback can run with its key and value pointing into freed memory.
Do not reinitialize special fields on insertion. Fresh allocator units are
already zeroed. For recycled units, the special fields are ownership state
that must remain visible to the eventual destructor. copy_map_value()
already skips those fields, matching the non-preallocated hash-map path and
the lifecycle established by commit 275c30bcee66 ("bpf: Don't reinit map
value in prealloc_lru_pop").
[ kkd: Split out the fix and rewrote the commit log ] |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Don't predict JMP32 pointer vs zero comparisons
Consider the following program:
r1 = map_value; /* low 32 bits are zero at runtime */
r6 = 0xdead000000000000;
if w1 != 0 goto l1;
l0: r1 += r6;
r2 = *(u64 *)(r1 + 0);
exit;
l1: r6 = 0;
goto l0;
At the moment is_branch_taken() reports the jump as always taken,
because it does not distinguish between BPF_JMP and BPF_JMP32
comparisons when processing 'if w1 != 0 ...'. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: zero extend the result of an arena 32-bit cmpxchg
bpf_convert_ctx_accesses() rewrites an atomic on an arena pointer from
BPF_STX | BPF_ATOMIC to BPF_STX | BPF_PROBE_ATOMIC, and it runs before
bpf_opt_subreg_zext_lo32_rnd_hi32().
That pass emits an explicit zero extension for a 32-bit cmpxchg even
when bpf_jit_needs_zext() is false. This is done because on some
architectures 32-bit cmpxchg requires explicit zero extension for the
dst register. E.g. on x86-64 'lock cmpxchg' does not change the %eax
if comparison is successful, while BPF semantics declare that each
operation on a 32-bit register zero extends it's upper half.
is_cmpxchg_insn() matches BPF_MODE == BPF_ATOMIC only, so an arena
cmpxchg misses said zero extension adjustment. This patch adjusts
is_cmpxchg_insn() to match BPF_PROBE_ATOMIC alongside BPF_ATOMIC. |
| In the Linux kernel, the following vulnerability has been resolved:
ASoC: Intel: avs: Fix unbalanced module reference count
strace_open() invokes try_module_get() which on success takes
the module reference. If any follow up operation causes
strace_open() to fail, the refcount shall be put down. |
| In the Linux kernel, the following vulnerability has been resolved:
ring-buffer: Add checking nr_subbufs to persistent ring buffer validation
Sashiko reported that the code was using meta->nr_subbufs without making
sure that it matched the nr_pages + 1 on data that was assuming the two
were the same.
Add a check to the persistent ring buffer validation code to make sure
that the saved nr_subbufs matches what we expect. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Reject tail calls directly from callback frames
A tail call from a non-zero frame is modeled as a return from that frame.
The verifier makes R0 unknown and calls prepare_func_exit() for the taken
branch.
When the current frame is a synchronous callback, prepare_func_exit()
enforces the callback return-value contract and marks R0 precise. Since the
tail-call path synthesized R0 rather than deriving it from an instruction,
precision backtracking reaches the callback-calling instruction with R0
still requested and triggers the "callback unexpected regs" verifier bug.
A CAP_BPF task can therefore cause a WARN and an -EFAULT BPF_PROG_LOAD.
Tail calls reachable from callbacks are already rejected later by
check_max_stack_depth(). Reject a tail call made directly by a callback
before constructing the inconsistent return state, using the existing
diagnostic. Tail calls from ordinary subprograms keep their current
behavior. |
| In the Linux kernel, the following vulnerability has been resolved:
ntfs: propagate reparse index insertion failure
update_reparse_data() ignores the return value of
set_reparse_index(). When index insertion fails, the code removes
the just-written reparse data as cleanup but still returns 0, so
symlink(2) (and WSL special file creation) reports success while
no reparse data exists on disk. When there was no previous reparse
data (oldsize == 0), the failure was likewise silently ignored.
Propagate the error to the caller. |
| In the Linux kernel, the following vulnerability has been resolved:
accel: ethosu: Don't read the U65 rounding mode as a storage mode
Bits 15:14 of NPU_SET_{IFM,OFM}_PRECISION select the activation storage
mode on U85 only. On U65 the same field holds the rounding mode, and the
command stream parser has read it as a storage mode since the driver was
added.
That went unnoticed while unknown values fell through the switch, but
now that they are rejected, every U65 command stream that asks for
natural rounding (2) fails CMDSTREAM_BO_CREATE with -EINVAL. Mesa emits
it for average pooling, concatenation, split, unpack, strided slice, LUT
and argmax, which is 72 failures of the Teflon test suite on an i.MX93.
Truncating rounding (1) is misread as well: it picks the two-tile
address path and computes a bogus feature map size from tile bases the
command stream never set.
Read the field as a storage mode only on the hardware where it is one. |
| In the Linux kernel, the following vulnerability has been resolved:
bpf: Fix REG INVARIANTS VIOLATION on speculative pointer arithmetic
Take the following unprivileged program as an example:
r0 = bpf_map_lookup_elem(...) /* PTR_TO_MAP_VALUE, offset 0 */
...
14: r0 += r1 /* r1 is a bounded scalar */
15: r9 = r0
Loading it triggers a verifier warning from reg_bounds_sanity_check():
verifier bug: REG INVARIANTS VIOLATION (alu): const subreg tnum out
of sync with range bounds r64={.base=0x0, .size=0x0}
r32={.base=0x0, .size=0xffffffff} var_off=(0x0, 0x0)
What happens:
1. Processing insn 14 (r0 += r1) in adjust_ptr_min_max_vals(), the new
offset is computed into dst_reg's var_off and 32/64-bit ranges.
2. Because pointer registers do not track 32-bit subregister bounds,
__mark_reg32_unbounded() first sets r32 to the full range; r32 is
re-derived from the offset at the end of the function by
reg_bounds_sync().
3. On the unprivileged path, sanitize_ptr_alu() is called and, via
sanitize_speculative_path() -> push_stack(), snapshots the current
register state and schedules the next instruction (insn 15) to be
verified directly as a speculative path.
4. That snapshot is taken between step 2 and the final reg_bounds_sync():
at this point dst_reg's var_off still holds the (const) original
offset while r32 has just been blanked to the full range, i.e. the two
are out of sync. When the speculative path later verifies insn 15
(r9 = r0), the inconsistent state reaches reg_bounds_sanity_check() and
trips the warning.
var_off and the 32-bit range must always be consistent. There are two
ways to keep the snapshot consistent:
1. sync var_off and r32 before the snapshot so they match, or
2. leave r32 at its original (already consistent) value and blank it
only after the snapshot.
The whole point of sanitize_ptr_alu() is to insert a harmless masking
sequence that keeps the access in bounds under speculation, so the state
it snapshots should faithfully represent that. Take approach 2: move
__mark_reg32_unbounded() to after sanitize_ptr_alu(), so the speculative
snapshot keeps the pointer's original, consistent r32. The non-speculative
path is unchanged: r32 is still blanked before the offset is applied and
re-derived by reg_bounds_sync(). |
| MISP contains a mass assignment vulnerability in the event delegation feature. When a user with delegation permission submits a delegation request, the application authorized the user against the event identified in the URL but then persisted the entire submitted record, including caller-supplied fields such as the primary key and event_id.
An authenticated attacker could inject a primary key or event_id into the delegation payload to retarget an existing delegation record to any event on the instance. Because a delegation row grants the requesting organisation read access to the event it references, this effectively granted read access to arbitrary events belonging to other organisations. If the target organisation subsequently accepted the delegation, ownership of the event was transferred and the original record was deleted.
Preconditions:
- An authenticated user with the delegation permission (perm_delegate)
- The MISP.delegation server setting must be enabled
Impact:
- Confidentiality: read access to any event on the instance
- Integrity: overwriting existing delegation records and transferring event ownership
Affected versions: MISP < 2.5.48 |
| Integer Overflow, Improper Validation of Array Index, Uncontrolled Recursion and Memory Allocation with Excessive Size Value in the Go implementation of Apache PLC4X (PLC4Go) allow a malicious device, or an attacker able to inject network traffic, to crash or exhaust the memory of the client application,
causing a denial of service.
The individual defects are:
- Generated parsers pre-allocate arrays with the element count claimed on the wire (0.13.0 through 0.13.1).
- Transport read helpers allocate buffers of the size claimed on the wire without an upper bound.
- ADS and KNXnet/IP response handling indexes into received data without checking its length, causing a panic.
- ADS and EIP frame-length handling accepts, or arithmetically wraps to, a length of zero, breaking message framing.
- Recursive protocol types are parsed without a nesting-depth limit. The same defect in the Java implementation is covered by CVE-2026-102509 https://cveprocess.apache.org/cve5/CVE-2026-102509 .
Additionally, length and position arithmetic in generated serializers was performed in 16-bit integers. If an application forwards attacker-influenced payloads larger than 8 KB, the length field wraps, and the remainder of the payload may be interpreted by the receiving device (for example, an ADS PLC) as
additional, independent protocol messages.
This issue affects Apache PLC4X: from 0.11.0 before 1.0.0. PLC4Go is consumed as the Go module github.com/apache/plc4x/plc4go; versions refer to the corresponding Apache PLC4X releases.
Users are recommended to upgrade to version 1.0.0, which fixes the issue. |
| Memory Allocation with Excessive Size Value, Allocation of Resources Without Limits, and Uncontrolled Recursion in the Java implementation of Apache PLC4X (PLC4J) allow a malicious or impersonated device to exhaust the memory or stack of the client application, causing a denial of service.
In the OPC UA driver these defects are reachable before authentication: the offending data is parsed while the secure channel and session are being established, before the server's identity has been bound to it. Configuring a trusted server therefore does not prevent exploitation by an attacker who can
impersonate it.
The individual defects are:
- Length-prefixed byte strings are allocated at the size claimed on the wire before the length is checked against the data actually received (0.10.0 through 0.13.1).
- Array fields in generated protocol parsers pre-allocate a list with the element count claimed on the wire, allowing a single count field to trigger a multi-gigabyte allocation. This parser is shared by all PLC4J drivers; the OPC UA driver is the verified pre-authentication path (0.10.0 through 0.13.1).
- The OPC UA driver accumulates message chunks without enforcing the negotiated maximum chunk count and message size (0.12.0 through 0.13.1).
- The OPC UA driver pre-allocates collections using element counts received from the server (0.10.0 through 0.13.1).
- Recursive protocol types are parsed without a nesting-depth limit. The same defect in the Go implementation is covered by CVE-2026-102510 https://cveprocess.apache.org/cve5/CVE-2026-102510 .
This issue affects Apache PLC4X: from 0.10.0 before 1.0.0.
Users are recommended to upgrade to version 1.0.0, which fixes the issue. |
| Buffer Overflow vulnerability in UTT nv518G nv518GV3v3.2.7-210919-161313 allows a remote attacker to cause a denial of service via the gohead/sub_447CAC component |
| An unauthenticated command injection vulnerability in the /goform/fast_setting_internet_set endpoint of Tenda AC18 v15.03.05.05 allows attackers to execute arbitrary commands via a crafted payload injected into the mac parameter. |
| Cross-Site Request Forgery (CSRF) vulnerability in Metagauss ProfileGrid profilegrid-user-profiles-groups-and-communities allows Cross Site Request Forgery.This issue affects ProfileGrid: from n/a through 6.0.0.2. |
| In the Linux kernel, the following vulnerability has been resolved:
accel/amdxdna: reject a command chain that carries no commands
A chain whose command_count is zero passes the payload length check,
because struct_size(payload, data, 0) is just the header. The fill loop
then does not run, so offset stays zero and the request is submitted with
a zero-length buffer.
On firmware without AIE2_NPU_COMMAND that ends at the opcode check, since
op is still ERT_INVALID_CMD and aie2_get_chain_msg_op() answers
MSG_OP_MAX_OPCODE. aie2_get_npu_chain_msg_op() answers
MSG_OP_CHAIN_EXEC_NPU whatever it is given, so there the submission
continues to drm_clflush_virt_range(cmd_buf, 0), which reads the byte
before the buffer and faults on the vmap guard page. EXEC_CMD is
reachable by any process that can open the render node.
Reject the request instead. |
| Improper Validation of Unsafe Equivalence in Input vulnerability in Liquid Web / StellarWP GiveWP allows Authentication Bypass.
This issue affects GiveWP: from n/a through 4.16.9. |
| In the Linux kernel, the following vulnerability has been resolved:
Bluetooth: L2CAP: fix out-of-bounds write in l2cap_ecred_connect
l2cap_chan_connect() tries to ensure there are no more than
L2CAP_ECRED_CONN_SCID_MAX pending ECRED channels, so they fit in the
same L2CAP_ECRED_CONN_REQ that l2cap_ecred_connect() constructs.
However, the check only counts deferred channels. If 6 L2CAP sockets
are connected at the same time in order DDDDND (D=deferred,
N=non-deferred), the last can bump the total to max+1. It results to
one __le16 written out of bounds of the scid array, and an invalid
ECRED_CONN_REQ being sent.
Fix by leaving room for the non-deferred pending ECRED channels in the
counting in l2cap_chan_connect(), so the limit can't be exceeded.
Move counting under same critical section where the channel is added.
Although race conditions involving this appear unreachable, it's easier
to see.
Also add WARN_ON_ONCE check in l2cap_ecred_defer_connect() to make this
less brittle. |
| Improper Neutralization of Special Elements used in an SQL Command ('SQL Injection') vulnerability in StylemixThemes Motors motors-car-dealership-classified-listings allows Blind SQL Injection.This issue affects Motors: from n/a through 1.4.109. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/virtio: use the DMA API for resource backing on Xen
On a Xen PV domain page addresses bear no relation to the real machine
addresses the host would have to use to reach it.
virtio_ring.c handles this correctly, vring_use_map_api() returns true
for any xen_domain() regardless of VIRTIO_F_ACCESS_PLATFORM.
virtio-gpu makes the same decision independently, but its copy
looks only at the feature bit:
bool use_dma_api = !virtio_has_dma_quirk(vgdev->vdev);
QEMU does not set iommu_platform on virtio-vga by default, so
VIRTIO_F_ACCESS_PLATFORM is not negotiated, use_dma_api is false, and
virtio_gpu_object_shmem_init() describes the framebuffer's backing pages
to the host with sg_phys(). Those are guest-physical addresses. In a PV
domain they resolve, on the host side, to pages belonging to some other
domain, so the host scans out unrelated memory.
Move the decision into virtio_gpu_use_dma_api() and give it the
xen_domain() check, like vring_use_map_api() has. This
additionally enables the dma_sync_sgtable_for_device() calls in
virtgpu_vq.c, which are required for correctness whenever swiotlb
is in play.
Reproduced with a Xen 4.21 PV dom0 nested inside QEMU 8.2 with
virtio-vga, on both a distro 6.8 kernel and 6.18 LTS. A PVH dom0
works fine and doesn't need this fix because it is identity-mapped,
only PV dom0s are affected. |
