| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| In Splunk Enterprise versions below 10.2.4, 10.0.7, 9.4.12, and 9.3.13, Splunk Cloud Platform versions below 10.3.2512.12, 10.2.2510.14, 10.1.2507.22, and 9.3.2411.132, and Splunk Secure Gateway versions below 3.10.6, 3.9.20, and 3.8.67, a low-privileged user that does not hold the 'admin' or 'power' Splunk roles could perform a Remote Code Execution (RCE) through the Splunk Secure Gateway app.<br><br>The Remote Code Execution is possible because of unsafe deserialization of App Key Value Store (KV Store) data through the ‘jsonpickle’ Python library, which reconstructs arbitrary Python objects from specially crafted JavaScript Object Notation (JSON) without adequate validation. |
| In Splunk Enterprise versions below 10.2.4 and 10.0.7, and Splunk Cloud Platform versions below 10.4.2604.0, 10.3.2512.12, 10.2.2510.15, 10.1.2507.23, 10.0.2503.14, and 9.3.2411.131, a user who holds a Splunk role that contains the high-privilege capability `edit_saved_search_owner` could reassign saved search ownership to users outside their authorized scope. The ownership reassignment endpoint lacks access control. |
| draw.io is a configurable diagramming and whiteboarding application. Prior to version 29.7.12, a crafted .drawio file can execute arbitrary JavaScript in the editor's origin when the file is opened. The vulnerability is not in the label sanitizer (which works correctly on the rendering path) but in a feature-detection routine in the Text Format panel that reads the raw cell label and assigns it to a detached element's innerHTML without sanitization. Browsers fire onerror for failed image loads even on detached elements, so an <img src=x onerror=...> payload in any cell label triggers script execution as soon as the cell is selected — which import does automatically. This issue has been patched in version 29.7.12. |
| HCL Digital Experience is affected by an OS command injection vulnerability in the Digital Asset Management API. An attacker may execute arbitrary operating system commands, typically inheriting the privileges of the vulnerable application, which could possibly lead to a complete system takeover and data compromise. |
| HCL Digital Experience and HCL Digital Experience Compose could be susceptible to Host header injection. An attacker can manipulate the Host header and cause the application to behave in unexpected ways. |
| HCL Digital Experience Compose is affected by a reflected cross-site scripting (XSS) vulnerability in the search center. An attacker could execute arbitrary JavaScript in the victim's browser. |
| JsonPulsarHeaderMapper matched type headers against trusted packages using a prefix check, meaning that trusting any package implicitly trusted all of its subpackages. Additionally, an empty trusted-packages configuration fell back to trusting all packages rather than applying a safe default allow-list.
Affected versions:
Spring for Apache Pulsar 2.0.0 through 2.0.5; 1.2.0 through 1.2.17; 1.1.0 through 1.1.17. |
| Spring Data REST is vulnerable to SpEL expression injection through map-typed properties when processing JSON Patch (application/json-patch+json) requests. When a persistent entity exposes a Map-typed property, the JSON Pointer path segment used as the map key is embedded directly into a SpEL expression without sanitization or validation.
Affected versions:
Spring Data REST 3.7.0 through 3.7.19; 4.3.0 through 4.3.16; 4.4.0 through 4.4.14; 4.5.0 through 4.5.11; 5.0.0 through 5.0.5. |
| Since Spring Security SAML decrypts SAML Responses as well as elements of SAML LogoutRequests and LogoutResponses without requiring a valid signature, attackers may be able to craft these SAML payloads and use the Service Provider as a decryption oracle.
Affected versions:
Spring Security 5.7.0 through 5.7.23; 5.8.0 through 5.8.25; 6.3.0 through 6.3.16; 6.4.0 through 6.4.16; 6.5.0 through 6.5.10; 7.0.0 through 7.0.5. |
| Out of bounds read in DevTools in Google Chrome prior to 149.0.7827.53 allowed a remote attacker to execute arbitrary code inside a sandbox via a crafted HTML page. (Chromium security severity: Low) |
| In the Linux kernel, the following vulnerability has been resolved:
xfrm: ah: account for ESN high bits in async callbacks
AH allocates its temporary auth/ICV layout differently when ESN is enabled:
the async ahash setup appends a 4-byte seqhi slot before the ICV or
auth_data area, but the async completion callbacks still reconstruct the
temporary layout as if seqhi were absent.
With an async AH implementation selected, that makes AH copy or compare
the wrong bytes on both the IPv4 and IPv6 paths. In UML repro on IPv4 AH
with ESN and forced async hmac(sha1), ping fails with 100% packet loss,
and the callback logs show the pre-fix drift:
ah4 output_done: esn=1 err=0 icv_off=20 expected_off=24
ah4 input_done: esn=1 auth_off=20 expected_auth_off=24 icv_off=32 expected_icv_off=36
Reconstruct the callback-side layout the same way the setup path built it
by skipping the ESN seqhi slot before locating the saved auth_data or ICV.
Per RFC 4302, the ESN high-order 32 bits participate in the AH ICV
computation, so the async callbacks must account for the seqhi slot.
Post-fix, the same IPv4 AH+ESN+forced-async-hmac(sha1) UML repro shows
the corrected offset (ah4 output_done: esn=1 err=0 icv_off=24
expected_off=24) and ping succeeds; net/ipv4/ah4.o and net/ipv6/ah6.o
build clean at W=1. IPv6 AH+ESN was not exercised at runtime, and the
change has not been tested against a real async hardware AH engine. |
| In the Linux kernel, the following vulnerability has been resolved:
f2fs: fix node_cnt race between extent node destroy and writeback
f2fs_destroy_extent_node() does not set FI_NO_EXTENT before clearing
extent nodes. When called from f2fs_drop_inode() with I_SYNC set,
concurrent kworker writeback can insert new extent nodes into the same
extent tree, racing with the destroy and triggering f2fs_bug_on() in
__destroy_extent_node(). The scenario is as follows:
drop inode writeback
- iput
- f2fs_drop_inode // I_SYNC set
- f2fs_destroy_extent_node
- __destroy_extent_node
- while (node_cnt) {
write_lock(&et->lock)
__free_extent_tree
write_unlock(&et->lock)
- __writeback_single_inode
- f2fs_outplace_write_data
- f2fs_update_read_extent_cache
- __update_extent_tree_range
// FI_NO_EXTENT not set,
// insert new extent node
} // node_cnt == 0, exit while
- f2fs_bug_on(node_cnt) // node_cnt > 0
Additionally, __update_extent_tree_range() only checks FI_NO_EXTENT for
EX_READ type, leaving EX_BLOCK_AGE updates completely unprotected.
This patch set FI_NO_EXTENT under et->lock in __destroy_extent_node(),
consistent with other callers (__update_extent_tree_range and
__drop_extent_tree) and check FI_NO_EXTENT for both EX_READ and
EX_BLOCK_AGE tree. |
| Inappropriate implementation in CustomTabs in Google Chrome on Android prior to 149.0.7827.53 allowed a local attacker to leak cross-origin data via a crafted HTML page. (Chromium security severity: Low) |
| In the Linux kernel, the following vulnerability has been resolved:
smb: client: validate dacloffset before building DACL pointers
parse_sec_desc(), build_sec_desc(), and the chown path in
id_mode_to_cifs_acl() all add the server-supplied dacloffset to pntsd
before proving a DACL header fits inside the returned security
descriptor.
On 32-bit builds a malicious server can return dacloffset near
U32_MAX, wrap the derived DACL pointer below end_of_acl, and then slip
past the later pointer-based bounds checks. build_sec_desc() and
id_mode_to_cifs_acl() can then dereference DACL fields from the wrapped
pointer in the chmod/chown rewrite paths.
Validate dacloffset numerically before building any DACL pointer and
reuse the same helper at the three DACL entry points. |
| In the Linux kernel, the following vulnerability has been resolved:
tracepoint: balance regfunc() on func_add() failure in tracepoint_add_func()
When a tracepoint goes through the 0 -> 1 transition, tracepoint_add_func()
invokes the subsystem's ext->regfunc() before attempting to install the
new probe via func_add(). If func_add() then fails (for example, when
allocate_probes() cannot allocate a new probe array under memory pressure
and returns -ENOMEM), the function returns the error without calling the
matching ext->unregfunc(), leaving the side effects of regfunc() behind
with no installed probe to justify them.
For syscall tracepoints this is particularly unpleasant: syscall_regfunc()
bumps sys_tracepoint_refcount and sets SYSCALL_TRACEPOINT on every task.
After a leaked failure, the refcount is stuck at a non-zero value with no
consumer, and every task continues paying the syscall trace entry/exit
overhead until reboot. Other subsystems providing regfunc()/unregfunc()
pairs exhibit similarly scoped persistent state.
Mirror the existing 1 -> 0 cleanup and call ext->unregfunc() in the
func_add() error path, gated on the same condition used there so the
unwind is symmetric with the registration. |
| In the Linux kernel, the following vulnerability has been resolved:
batman-adv: reject new tp_meter sessions during teardown
Prevent tp_meter from starting new sender or receiver sessions after
mesh_state has left BATADV_MESH_ACTIVE. |
| In the Linux kernel, the following vulnerability has been resolved:
vsock/virtio: fix empty payload in tap skb for non-linear buffers
For non-linear skbs, virtio_transport_build_skb() goes through
virtio_transport_copy_nonlinear_skb() to copy the original payload
in the new skb to be delivered to the vsockmon tap device.
This manually initializes an iov_iter but does not set iov_iter.count.
Since the iov_iter is zero-initialized, the copy length is zero and no
payload is actually copied to the monitor interface, leaving data
un-initialized.
Fix this by removing the linear vs non-linear split and using
skb_copy_datagram_iter() with iov_iter_kvec() for all cases, as
vhost-vsock already does. This handles both linear and non-linear skbs,
properly initializes the iov_iter, and removes the now unused
virtio_transport_copy_nonlinear_skb().
While touching this code, let's also check the return value of
skb_copy_datagram_iter(), even though it's unlikely to fail. |
| In the Linux kernel, the following vulnerability has been resolved:
batman-adv: stop tp_meter sessions during mesh teardown
TP meter sessions remain linked on bat_priv->tp_list after the netlink
request has already finished. When the mesh interface is removed,
batadv_mesh_free() currently tears down the mesh without first draining
these sessions.
A running sender thread or a late incoming tp_meter packet can then keep
processing against a mesh instance which is already shutting down.
Synchronize tp_meter with the mesh lifetime by stopping all active
sessions from batadv_mesh_free() and waiting for sender threads to exit
before teardown continues. |
| In the Linux kernel, the following vulnerability has been resolved:
drm/gem: Fix inconsistent plane dimension calculation in drm_gem_fb_init_with_funcs()
drm_gem_fb_init_with_funcs() computes sub-sampled plane dimensions
using plain integer division:
unsigned int width = mode_cmd->width / (i ? info->hsub : 1);
unsigned int height = mode_cmd->height / (i ? info->vsub : 1);
However, the ioctl-level framebuffer_check() in drm_framebuffer.c uses
drm_format_info_plane_width/height() which round up dimensions via
DIV_ROUND_UP(). This inconsistency corrupts the subsequent GEM object
size check for certain pixel format and dimension combinations.
For example, with NV12 (vsub=2) and a 1-pixel-tall framebuffer the
GEM size validation path sees height=0 instead of height=1. The
expression (height - 1) then wraps to UINT_MAX as an unsigned int,
causing min_size to overflow and wrap back to a small value. A tiny
GEM object therefore passes the size guard, yet when the GPU accesses
the chroma plane it will read or write memory beyond the object's
bounds.
Fix by replacing the open-coded divisions with drm_format_info_plane_width()
and drm_format_info_plane_height(), which use DIV_ROUND_UP() and match
the calculation already used in framebuffer_check(). |
| In the Linux kernel, the following vulnerability has been resolved:
media: iris: fix use-after-free of fmt_src during MBPF check
During concurrency testing, multiple instances can run in parallel, and
each instance uses its own inst->lock while the core->lock protects the
list of active instances. The race happens because these locks cover
different scopes, inst->lock protects only the internals of a single
instance, while the Macro Blocks Per Frame (MBPF) checker walks the
core list under core->lock and reads fields like fmt_src->width and
fmt_src->height. At the same time, iris_close() may free fmt_src and
fmt_dst under inst->lock while the instance is still present in the core
list. This allows a situation where the MBPF checker, still iterating
through the core list, reaches an instance whose fmt_src was already
freed by another thread and ends up dereferencing a dangling pointer,
resulting in a use-after-free. This happens because the MBPF checker
assumes that any instance in the core list is fully valid, but the
freeing of fmt_src and fmt_dst without removing the instance from the
core list is not correct.
The correct ordering is to defer freeing fmt_src and fmt_dst until after
the instance has been removed from the core list and all teardown under
the core lock has completed, ensuring that no dangling pointers are ever
exposed during MBPF checks. |
