| CVE |
Vendors |
Products |
Updated |
CVSS v3.1 |
| A security flaw has been discovered in girishsaraf Online-Appointment-Booking-System up to f427b4757128ca253d33d0cc4e87bbb9c999a4d5. Impacted is an unknown function of the file signup.php of the component Registration Handler. The manipulation of the argument fname results in sql injection. The attack can be executed remotely. The exploit has been released to the public and may be used for attacks. This product implements a rolling release for ongoing delivery, which means version information for affected or updated releases is unavailable. The project was informed of the problem early through an issue report but has not responded yet. |
| A security flaw has been discovered in dotnet eShop .NET 8. The impacted element is the function GetOrderAsync of the file src/Ordering.API/Apis/OrdersApi.cs of the component Ordering API. Performing a manipulation of the argument OrderNumber results in improper control of resource identifiers. The attack is possible to be carried out remotely. The project was informed of the problem early through an issue report but has not responded yet. |
| A weakness has been identified in feelec-yishu feelcrm-os 1.0.0. This vulnerability affects the function index of the file App/Feelcrm/Index/Controller/MemberController.class.php of the component Member Endpoint. This manipulation of the argument group_id causes sql injection. The attack can be initiated remotely. The exploit has been made available to the public and could be used for attacks. The project was informed of the problem early through an issue report but has not responded yet. |
| Punk versions from 0.48 before 0.55 for Perl route Extended CONNECT requests to any GET route without an Origin check in ps_serve_one.
On HTTP/2 and HTTP/3 a WebSocket handshake arrives as an Extended CONNECT, which is matched as a GET and so reaches every GET route, API operation and mount. The Origin check runs only when a websocket route matches. On this transport the handler's status is the handshake response, and a 2xx accepts it.
A cross-origin page can open a WebSocket to any path and learn from its open or error event whether that path returns 2xx. |
| A flaw was found in SSSD. An unprivileged local user can repeatedly request lookups for nonexistent entries through the Name Service Switch (NSS) responder. Because the negative cache does not limit the total number of stored entries and only removes expired records when an existing key is rechecked, the cache can grow without bound. This behavior can lead to memory exhaustion, resulting in a Denial of Service (DoS) as the responder becomes unresponsive or terminates. |
| A flaw was found in SSSD. An unprivileged local user can repeatedly request master automount map updates through the autofs responder due to missing authorization checks. This triggers global cache invalidation and forces repeated lookups to backend directory providers, leading to a Denial of Service (DoS) from degraded automount availability and elevated resource consumption. |
| A flaw was found in sssd. This vulnerability allows a local user to cause a Denial of Service (DoS) by submitting a specially crafted passkey authentication token that lacks null terminators. The authentication service reads past the end of the provided memory buffer, causing the process to crash and disrupting authentication services. |
| In MongoDB Controllers for Kubernetes, insufficient validation of Ops Manager backup configuration may allow a user who can modify an OpsManager custom resource to cause unintended administrative changes in Ops Manager. This affects deployments using Enterprise Ops Manager backup reconciliation. |
| Docker Buildx Bake does not request the expected fs.read approval for certain filesystem inputs. An untrusted Bake definition can expose a readable file through a pathless secret whose ID is interpreted as a client-side pathname, or consume a local OCI image layout outside the project after entitlement validation checks a different path representation. Users who run untrusted Bake definitions are affected. |
| In AMD Versal™ Adaptive SoC devices, insufficient boundary checks in USB boot mode—when enabled through board modifications—could allow crafted images to trigger a buffer overflow and overwrite an active function pointer, which may result in arbitrary code execution during boot process. This condition could lead to potential impacts on confidentiality, integrity, and availability. |
| Insufficient boundary validation in the USB boot mode implementation of AMD Zynq™ UltraScale+ MPSoC and RFSoC devices could allow unbounded Device Firmware Upgrade (DFU) download requests to overflow the DDR receive buffer into FSBL memory, potentially resulting in unauthorized code execution during the boot process. This issue could impact the confidentiality, integrity, or availability of affected system. |
| Strapi through 4.5.5 allows attackers (with access to the admin panel) to discover sensitive user details by exploiting the query filter. The attacker can filter users by columns that contain sensitive information and infer a value from API responses. If the attacker has super admin access, then this can be exploited to discover the password hash and password reset token of all users. If the attacker has admin panel access to an account with permission to access the username and email of API users with a lower privileged role (e.g., Editor or Author), then this can be exploited to discover sensitive information for all API users but not other admin accounts. |
| In the Linux kernel, the following vulnerability has been resolved:
net: bcmasp: clear txcb->last before writing each descriptor
bcmasp_xmit() only wrote txcb->last = true for the final fragment
of an SKB; non-final fragments left the field untouched. If a
descriptor slot was reused while it still held a stale true from
a previous SKB (possible when tx_spb_ring_full() underreported
fullness), bcmasp_tx_reclaim() would see last == true mid-SKB and
call dev_consume_skb_any() prematurely, freeing the sk_buff while
its remaining fragments were still in flight.
Unconditionally clear txcb->last before the conditional set so every
descriptor slot starts from a known false state regardless of what a
prior transmission left behind. |
| In the Linux kernel, the following vulnerability has been resolved:
exec: Cleanup POSIX timers right after de_thread()
A per-thread CPU timer holds a reference to the PID of the thread it is
attached to and, while it is armed, its node is queued in that thread's
posix_cputimers. The task is looked up by that PID.
When a non-leader thread exec()s, de_thread() changes which task owns
that PID. pid_task(timer->it.cpu.pid, PIDTYPE_PID) then returns NULL,
but the node is still queued on tsk, which is alive. timer_lock_sighand()
takes a failed lookup to mean that the node is already dequeued, so it
has nothing to undo.
begin_new_exec() calls posix_cpu_timers_exit(me) right after
exec_task_namespaces() and that removes the leftover node, so the state
normally stays invisible. But bprm->point_of_no_return is set before
de_thread(), so if unshare_files(), set_mm_exe_file(), exec_mmap() or
exec_task_namespaces() fails, the task dies before it gets there.
exit_itimers() then frees the k_itimer while its node is still queued,
and reaping tsk later erases that freed node from the rbtree.
In short:
the non-leader thread B the parent
timer_create(CLOCK_THREAD_CPUTIME_ID)
timer_settime()
arm_timer() // the node is queued on B
execve()
de_thread(B)
exchange_tids(B, leader) // B's PID now belongs to the leader
release_task(leader)
__exit_signal(leader)
posix_cpu_timers_exit(leader) // cleans leader's queue, not B's
__unhash_process(leader) // that PID has no task anymore
exec_mmap()
mmap_read_lock_killable(old_mm)
kill(B, SIGKILL)
// -EINTR
get_signal()
do_exit()
exit_itimers()
posix_timer_delete()
posix_cpu_timer_del()
posix_timer_unhash_and_free() // freed while still queued
wait4()
release_task(B)
posix_cpu_timers_exit(B)
cleanup_timerqueue()
timerqueue_del() // use-after-free
Move the POSIX timer cleanup right after de_thread() before any of the
later failure conditions brings the task into do_exit().
[ tglx: Move the cleanup right after de_thread() ] |
| In the Linux kernel, the following vulnerability has been resolved:
ALSA: usb-audio: Clamp implicit feedback packet count to URB capacity
data_ep_set_params() allocates each data URB for exactly u->packets
isochronous frames, so urb->iso_frame_desc[] has u->packets slots and
ctx->packets is the driver's only record of that limit. For an implicit
feedback sink, snd_usb_queue_pending_output_urbs() overwrites it with the
sync source's packet count, which is calculated independently from the
capture endpoint's parameters. When that count is larger,
prepare_playback_urb() and prepare_silent_urb() can write
iso_frame_desc[] past the allocation; their existing bounds limit payload
bytes, not the descriptor index.
The reproducer uses a high-speed UAC2 device declaring bInterval 1 for
implicit feedback capture (8 packets) and bInterval 4 for playback
(1 packet). On the first capture completion after the stream starts, it
accesses seven descriptors spanning 112 bytes beyond the one-packet URB:
BUG: KASAN: slab-out-of-bounds in prepare_playback_urb (sound/usb/pcm.c:1560)
Write of size 4 at addr ffff88801e696ad0 by task vhci_rx/178
prepare_playback_urb (sound/usb/pcm.c:1560)
prepare_outbound_urb (sound/usb/endpoint.c:340)
snd_usb_queue_pending_output_urbs (sound/usb/endpoint.c:501)
snd_complete_urb (sound/usb/endpoint.c:1834)
__usb_hcd_giveback_urb (drivers/usb/core/hcd.c:1657)
usb_hcd_giveback_urb (drivers/usb/core/hcd.c:1741)
vhci_rx_loop (drivers/usb/usbip/vhci_rx.c:107)
kthread (kernel/kthread.c:436)
The buggy address belongs to the object at ffff88801e696a00
which belongs to the cache kmalloc-256 of size 256
The buggy address is located 0 bytes to the right of
allocated 208-byte region [ffff88801e696a00, ffff88801e696ad0)
Record the allocated packet count per endpoint and clamp both the adopted
count and the packet-size copy to it. Fold the Format Type II delimiter
into urb_packs before the allocation loop so the recorded limit matches
every URB. |
| In the Linux kernel, the following vulnerability has been resolved:
net: psp: avoid conflicts with skb->decrypted and sk_validate_xmit_skb()
PSP conflicts with TLS ULP in its usage of both skb->decrypted and
sk->sk_validate_xmit_skb().
Make PSP mutually exclusive with TLS ULP, the only other user of either
of these. As other users of skb->decrypted come along, they can be added
to sk_has_decrypt_user(). It would make sense to also assert that
sk->sk_validate_xmit_skb() is also NULL in both of these setup paths for
similar future proofing, but the PSP listener/sk_clone() path is still
broken and it could be seen as a regression to not allow rx assoc to run
on a child of a listener socket with PSP tx assoc state.
Include all TCP ULPs in the sk_has_decrypt_user() check, even though TLS
is the only one that conflicts with PSP via the decrypted bit. This is
intentional because PSP was not designed to be used with ULPs. It is
best to close off surface area that may make bugs reachable, until
someone wishes to design and test an actual user of PSP with ULPs. |
| In the Linux kernel, the following vulnerability has been resolved:
pppoatm: ensure a writable skb header and linear data
In pppoatm_send(), LLC encapsulation checks whether there is sufficient
headroom for the 4-byte LLC header, but does not ensure that the skb header
is writable.
Normal transmit packets passing through ppp_start_xmit() have their header
unshared via skb_cow_head(). However, packets can also reach pppoatm_send()
via PPP channel bridging (PPPIOCBRIDGECHAN) without going through
ppp_start_xmit().
Use skb_cow_head() to ensure both sufficient headroom and a writable
header before pushing the LLC header.
While at it:
- Call pskb_may_pull(skb, 1) before inspecting skb->data[0] to prevent
out-of-bounds reads on zero-length or non-linear frames (e.g. from
bridging).
- Defer SC_COMP_PROT protocol compression until after pppoatm_may_send()
succeeds. This eliminates the temporary skb allocation on admission failure
and completely removes the fragile "undo" heuristic at the nospace label,
avoiding any risk of reading uninitialized headroom or performing an
unbalanced skb_push(). |
| In the Linux kernel, the following vulnerability has been resolved:
af_unix: Unify scc_index when finalising SCC in __unix_walk_scc().
Commit bfdb01283ee8 ("af_unix: Assign a unique index to SCC.")
changed Tarjan's algorithm to update lowlink with lowlink,
which is called lowpoint (unix_vertex.scc_index).
unix_vertex_dead() assumes all vertices in an SCC share the same
lowpoint, but this is not always true if an SCC has two or more
back edges, depending on the order of DFS.
For example, the graph below has two back edges from B to A
and from C to B.
A --> B --> C
^ | ^ |
`----' `----'
If DFS walks through A -> B -> C -> B (-> C -> B) -> A (-> B -> A),
each index and scc_index will be updated as follows.
A --> B --> C C = (3, 3) (index, scc_index)
B = (2, 2)
A = (1, 1)
A ... B ... C C = (3, 2)<-.
^ | B = (2, 2) -'
`----' A = (1, 1)
A ... B ... C C = (3, 2)
^ | . . B = (2, 1)<-.
`----' .... A = (1, 1) -'
Then, unix_vertex_dead() thinks that B is passed to another
SCC with scc_index 2, and the SCC is not garbage-collected.
This does not happen if DFS walks in a different order below
or starts from B.
1 3
A --> B --> C
^ | ^ |
`----' `----'
2 4
Let's unify scc_index across the SCC when finalising it.
Note that updating v->index was previously done in unix_scc_dead(),
when called from __unix_walk_scc(), just to save one loop. Since
__unix_walk_scc() now iterates over the SCC anyway, the update is
moved back to __unix_walk_scc() and 'fast' argument is dropped. |
| Mitigation bypass in the File Handling component. This vulnerability was fixed in Firefox 157.0.1. |
| MsQuic is a cross-platform C implementation of the IETF QUIC protocol exposed to C, C++, C#, and Rust. Prior to 2.4.20, 2.5.11, and 2.6.1, MsQuic clients using the OpenSSL or QuicTLS TLS backend do not properly verify that a server certificate matches the intended target server hostname. An on-path attacker can therefore present a certificate that does not match the intended target hostname and spoof the server in a man-in-the-middle attack. The Schannel backend is not affected. This issue is fixed in versions 2.4.20, 2.5.11, and 2.6.1. |
