CVE Feed

In the Linux kernel, the following vulnerability has been resolved: RDMA/efa: Keep admin queues alive while IRQ is registered The management IRQ handler accesses both the admin completion queue and the async event queue. The driver registered the IRQ before constructing these queues and destroyed them before freeing the IRQ, so the handler's lifetime was not contained by the resources it accesses. Initialize the queues with interrupts masked, request the IRQ, and then switch to interrupt mode. On removal, reset the device and free the IRQ before destroying the queues. Also reset the device before destroying the queues if IRQ registration fails, because the device already has their DMA addresses.

In the Linux kernel, the following vulnerability has been resolved: RDMA/efa: Keep EQ resources alive while IRQ is registered The completion IRQ handler accesses the EQ state and DMA buffer. Its IRQ was registered before that state was initialized, while teardown released the buffer before free_irq() synchronized the handler. Initialize the EQ without arming it, register the IRQ, and then arm it. Reverse the resource order during teardown by freeing the IRQ before destroying the EQ.

In the Linux kernel, the following vulnerability has been resolved: ALSA: usb: 6fire: Avoid embedded URBs The USB 6fire driver uses URBs embedded in different structs for PCM, MIDI and communication, and this is basically a buggy implementation nowadays; since a URB is managed with a refcount, this may lead to a UAF when the URB is released asynchronously. For addressing the problem, this patch converts those embedded URBs to ones that are properly allocated via usb_alloc_urb(). The pcm_urb.packets[] is gone, as it's allocated by usb_alloc_urb(), hence it's found in urb.iso_frame_desc[] instead. The conversions are rather straightforward; each embedded struct urb is changed to a pointer, and its callers are updated accordingly. The resource for those structs are released in the common destructor functions (usb6fire_comm_free(), etc), which are called at both the init error path and the disconnect. No functional changes, only compile-tested.

In the Linux kernel, the following vulnerability has been resolved: net/sched: codel: bound the dropping loop per dequeue call The CoDel control law schedules the next drop one interval/sqrt(count) after the previous drop, using the configured interval (codel_params.interval). For very small intervals the scheduled step rounds down to zero, so the dropping loop in codel_dequeue() never advances and drains the entire backlog under the qdisc lock in one call - an unprivileged user can trigger a soft lockup this way. Fix in the shared codel code used by both codel and fq_codel: 1. Make the control-law step at least 1 tick so the dropping loop always moves forward. 2. Cap the dropping loop at CODEL_MAX_DROPS_PER_DEQUEUE (256) drops per codel_dequeue() call, resyncing drop_next to now when the cap is hit: the catch-up owed to the loop grows with the idle gap and the backlog, which no interval threshold can bound. This is a deliberate behaviour change after long idle gaps. The cap applies to fq_codel (4b549a2ef4be) and the mac80211 TXQ path (fixed interval, cap only). The target sojourn delay (codel_params.target) is not validated: it does not feed the control law, so a sub-tick value is aggressive rather than deadlock-prone. Conditions to recreate the bug: - tc qdisc add dev lo root handle 1: tbf rate 1kbit burst 2kb limit 1000000 - tc qdisc add dev lo parent 1:1 handle 10: codel interval 2us target 1ms noecn limit 1000000 (same for fq_codel) - unpatched kernel: tc accepts it; a UDP flood under the 1kbit tbf soft-lockups (watchdog: BUG: soft lockup) while one codel_dequeue() call drops the backlog under the qdisc lock - patched kernel: same setup, at most 256 drops per dequeue call, no soft lockup Testing: claim reproducer and interval 2us/3us variants run clean; tdc qdisc category passes (see the selftests patch).

In the Linux kernel, the following vulnerability has been resolved: wifi: mwifiex: fix IRQ leak using wrong index in MSI-X error path mwifiex_pcie_request_irq() registers each MSI-X vector with a per-index dev_id (&card->msix_ctx[i]). On a request_irq() failure the cleanup loop "for (j = 0; j < i; j++)" frees msix_entries[j].vector but passes the failed index's &card->msix_ctx[i] as the dev_id. free_irq() matches on (irq, dev_id), so it fails to find the action registered with &card->msix_ctx[j]: the already-requested IRQ j is not freed (leaked) and free_irq() warns about freeing a non-existent IRQ. Use &card->msix_ctx[j].

In the Linux kernel, the following vulnerability has been resolved: wifi: mac80211: don't warn when an IBSS has no channel to scan ieee80211_request_ibss_scan() warns when regulatory leaves no allowed channel, but that can happen as the regdomain can change while IBSS is operating, and it can continue to operate briefly during the 60s grace period until it's shut down. Just remove the warning in this case.

In the Linux kernel, the following vulnerability has been resolved: wifi: cfg80211: undo netns switch if renaming the wiphy fails Once all the interfaces have been moved, cfg80211_switch_netns() moves the wiphy itself by setting its network namespace and then renaming it, which makes sysfs move it. The rename can fail (but only on allocation failures), leaving things mixed up and hitting the warning there. Ignoring it isn't great, undo the move and let the change fail in this case. If undo fails then WARN, then things would again be stuck in two different network namespaces.

In the Linux kernel, the following vulnerability has been resolved: wifi: mac80211_hwsim: don't hand frames to mac80211 while stopping The code checks ->started for frames coming from wmediumd, but the radio can be stopped after the check and before frame delivery, causing mac80211 to hit the WARN_ON(!local->started). Expand the mutex for this case and synchronise against it when the radio is stopped to avoid being able to hit the warning with hwsim. Drop the error print that would've complicated the error path, it only triggers for allocation failures (already noisy) and malformed frames anyway.

In the Linux kernel, the following vulnerability has been resolved: wifi: mac80211: require a peer station for TDLS setup confirm It's nonsense for the setup confirm to go to station that doesn't even exist, and it hits a warning when building the frame: WARN_ON_ONCE(!sta || !ap_sta) Only accept WLAN_TDLS_SETUP_CONFIRM when the station is already there as a TDLS station. Need to copy the call to ieee80211_tdls_prep_mgmt_packet() since the existing WLAN_TDLS_DISCOVERY_REQUEST already falls through to it.

In the Linux kernel, the following vulnerability has been resolved: net: xfrm: reject unrepresentable espintcp transport headers ESP-in-TCP can hand xfrm packets whose transport header offset no longer fits after the stream parser trims the TCP envelope. The plain transport header reset truncates that offset and triggers the skb warning path. Use the careful transport-header helper and drop the skb through the existing XFRM error path when the offset cannot be represented.

In the Linux kernel, the following vulnerability has been resolved: dmaengine: ti: k3-udma-glue: fix NULL dereference in k3_udma_glue_release_rx_chn() If devm_kcalloc() for rx_chn->flows fails in a channel request function, the error path calls k3_udma_glue_release_rx_chn(), which dereferences the NULL rx_chn->flows pointer in k3_udma_glue_release_rx_flow(). Skip the flow release loop in k3_udma_glue_release_rx_chn() when rx_chn->flows is not allocated. Found by Linux Verification Center (linuxtesting.org) with SVACE.

In the Linux kernel, the following vulnerability has been resolved: memcg: avoid charging the root memcg from obj_cgroup_charge_pages() obj_cgroup_charge_pages() resolves the objcg to its memcg and calls try_charge_memcg(), which does not short circuit the root memcg. That memcg can be the root memcg: obj_cgroup_is_root() reflects the memcg the objcg was created for and is never updated, while memcg_reparent_objcgs() does redirect objcg->memcg to the parent on rmdir. An objcg of a dying child of root therefore passes every obj_cgroup_is_root() filter but resolves to the root memcg. Folios keep the objcg they were charged with, so this is easy to reach through zswap: allocate anon memory in a cgroup, move the task out, remove the cgroup, then write to the root cgroup's memory.reclaim. The reclaimed folios are charged through the reparented objcg and end up in refill_stock() with the root memcg: WARNING: mm/memcontrol.c:2198 at refill_stock+0x644/0x940 refill_stock+0x644/0x940 try_charge_memcg+0x12d6/0x1570 __obj_cgroup_charge+0x35/0xf0 obj_cgroup_charge+0x1de/0x210 obj_cgroup_charge_zswap+0x83/0x270 zswap_store+0x1620/0x2000 swap_writeout+0x94c/0x14c0 shrink_folio_list+0x3388/0x52b0 [...] try_to_free_mem_cgroup_pages+0x30d/0x830 user_proactive_reclaim+0x504/0x840 memory_reclaim+0x1f/0x30 Beyond the warning, the charge is asymmetric: obj_cgroup_uncharge_pages() skips refill_stock() for the root memcg, so the root's page counter grows and is never uncharged. It is not user visible, since memory.current is not exposed on the root, but it is a leak. Use try_charge(), which returns early for the root memcg, restoring the symmetry with obj_cgroup_uncharge_pages(). The above sequence was scripted into a standalone reproducer (zswap on, swap on a virtio disk, 512MB of anon memory faulted in inside a child of the root cgroup, the task then migrated to the root cgroup, the child removed, followed by "echo 600M swappiness=max > memory.reclaim" on the root) and run in a CONFIG_DEBUG_VM=y VM. It reproduces the splat on the first zswap store of a reparented folio, with the same call chain as the report. With this patch applied the splat is gone while the zswap store count over the run is unchanged, so the same path is still exercised. cgroup selftests test_zswap, test_kmem and test_memcontrol show no new failures.

In the Linux kernel, the following vulnerability has been resolved: power: sequencing: fix NULL-pointer dereference in pwrseq_unit_new() If memory allocation fails in pwrseq_unit_setup_deps(), pwrseq_unit_put() is called to release the partially initialized unit. However, we've never initialized unit->list and pwrseq_unit_release() will unconditionally call list_del() on it. Initialize unit->list right after allocating the unit struct.

In the Linux kernel, the following vulnerability has been resolved: power: sequencing: fix NULL-pointer dereference in pwrseq_device_register() If dev_set_name() fails in pwrseq_device_register(), we jump to the err_put_pwrseq label before initializing pwrseq->targets. pwrseq_release() will try to iterate over targets unconditionally and subsequently dereference an invalid pointer. Move the call to dev_set_name() after the list head is initialized.

In the Linux kernel, the following vulnerability has been resolved: watchdog: da9063: fix suspend/resume handling of HW_RUNNING watchdog da9063_wdt_suspend() and da9063_wdt_resume() only check watchdog_active(), when the watchdog is left running by the driver sets WDOG_HW_RUNNING in da9063_wdt_probe() but userspace never opens the device, so WDOG_ACTIVE remains cleared, the wdt_disable() will not be executed in da9063_wdt_suspend. In this case, the suspend callback is a no-op and the watchdog keeps counting during system suspend, leading to an unexpected system reset. Check WDOG_HW_RUNNING and wdd，can fix this issue.

In the Linux kernel, the following vulnerability has been resolved: watchdog: rzv2h: Avoid division by zero clk_get_rate() could return 0. Avoid a division by zero panic.

In the Linux kernel, the following vulnerability has been resolved: s390/boot: Avoid IPL parameter append past command line A command line may occupy all but the terminating byte of COMMAND_LINE_SIZE. In that case append_ipl_block_parm() passes a zero size to the IPL parameter conversion helpers and points the destination one byte past early_command_line. The helpers subtract one from the unsigned size and write the converted parameter outside the command line buffer. Convert the IPL parameter in the command line parsing buffer first. A parameter beginning with '=' can then replace the existing command line regardless of its length, while other parameters are appended only when space remains.

In the Linux kernel, the following vulnerability has been resolved: s390/ipl: Fix NULL deref in kdump without re-IPL parm block Some IPL types, like HMC FTP boot or QEMU direct kernel boot, might not provide an IPL parameter block. In this case, reipl_type_init() selects IPL_TYPE_UNKNOWN, and reipl_block_actual remains NULL. kdump passes the re-IPL parameter block to the dump kernel through os_info. Before commit 3b9678472bab ("s390/ipl: correct kdump reipl block checksum calculation"), the os_info entry was added only for IPL types which initialized reipl_block_actual. That commit moved the os_info update to machine_crash_shutdown(), making it unconditional. As a result, set_os_info_reipl_block() dereferences reipl_block_actual for IPL_TYPE_UNKNOWN. This may happen to work by chance when address zero contains readable lowcore data and the resulting empty os_info entry is ignored by the dump kernel. Skip the os_info update when no re-IPL parameter block is available. Kdump then collect the dump and reboot without setting re-IPL parameter block.

In the Linux kernel, the following vulnerability has been resolved: s390/ipl: Fix NULL deref in dump_reipl without re-IPL parm block Unlike kdump, which passes the re-IPL parameter block through os_info, the stand-alone dump passes it through the IPL parm block address and checksum in lowcore. Some IPL types, like HMC FTP boot or QEMU direct kernel boot, might not provide an IPL parameter block. In this case reipl_type_init() selects IPL_TYPE_UNKNOWN and reipl_block_actual remains NULL. Nevertheless, dump_reipl_run() unconditionally dereferences it when preparing the lowcore fields. This may happen to work by chance when address zero contains readable lowcore data. A zero IPL parameter block address is then stored in lowcore, causing the stand-alone dumper to enter disabled wait after completing the dump. Explicitly store a zero IPL parameter block address and checksum when no re-IPL parameter block is available. This does not change the behavior: the stand-alone dumper completes the dump and halts, while valid re-IPL parameter blocks continue to be handled as before.

In the Linux kernel, the following vulnerability has been resolved: powerpc: Do not restore KUAP in arch_exit_to_user_mode_prepare() KUAP means kernel cannot touch user memory unless it explicitly is enabled. In the kernel it should stay AMR_KUAP_BLOCKED. While returning to userspace just before RFI, kernel should restore the user AMR value back. Looks like GENERIC_ENTRY might be treating arch_exit_to_user_mode_prepare() as the last architecture step before returning to userspace. commit bee25f97ad24 ("powerpc: Enable GENERIC_ENTRY feature") therefore called kuap_user_restore() from that hook. But on PowerPC that is too early. After irqentry_exit() / syscall_exit_to_user_mode() we still run platform specific exit routines. e.g. code snippets showing both exception handling and system call handling as the callers of function arch_exit_to_user_mode_prepare() which does kuap_user_restore(). The below path shows that calling kuap_user_restore() is too early when called from arch_exit_to_user_mode_prepare(). Exception handling in exceptions-64s.S ======================================= bl CFUNC(do_page_fault) ..DEFINE_INTERRUPT_HANDLER_ASYNC(do_page_fault) arch_interrupt_async_enter_prepare(regs); state = irqentry_enter(regs); instrumentation_begin(); irq_enter_rcu(); handler(regs); nap_adjust_return(regs); irq_exit_rcu(); instrumentation_end(); arch_interrupt_async_exit_prepare(regs); irqentry_exit(regs, state); <<< too early irqentry_exit_to_user_mode() __exit_to_user_mode_prepare(regs, EXIT_TO_USER_MODE_WORK_IRQ); arch_exit_to_user_mode_prepare(regs, ti_work); <<< too early b interrupt_return_srr .. bl CFUNC(interrupt_exit_user_prepare) <<< already calls kuap_user_restore prep_irq_for_enabled_exit() retry can run kernel code with IRQs on. So only when that routine is fully finished is when the user KUAP should be fully restored which interrupt_exit_user_prepare() already takes care of before returning. Similarly for system call handling in interrupt_64.S ====================================================== bl CFUNC(system_call_exception) .Lsyscall_exit: addi r4,r1,STACK_INT_FRAME_REGS li r5,0 /* !scv */ bl CFUNC(syscall_exit_prepare) .. kuap_assert_locked(); syscall_exit_to_user_mode(regs); <<< too early syscall_exit_to_user_mode_prepare(regs); <<< too early kuap_user_restore(regs); <<< already calls syscall_exit_prepare(), which can enable IRQs, replay a pending interrupt, and only then rfi. Those functions already restore KUAP immediately before rfi. Note that if we restore the user AMR too early like in the current code as shown from the code snippets above, then we get the following warning when CONFIG_PPC_KUAP_DEBUG is enabled: WARNING: arch/powerpc/include/asm/book3s/64/kup.h:293 at interrupt_exit_user_prepare+0x1a0/0x1c0 Hardware name: IBM pSeries (emulated by qemu) POWER10 (architected) TRAP: 0700 LR: c00000000000d8d4 CTR: c0000000021fe500 MSR: <SF,EE,ME,IR,DR,RI,LE> CR: 44000804 XER: 20040000 interrupt_exit_user_prepare+0x1a0/0x1c0 interrupt_return_srr_user+0x8/0x12c

In the Linux kernel, the following vulnerability has been resolved: powerpc/entry: Fix irq_soft_mask corruption on replayed interrupt exit When __replay_soft_interrupts() replays a pending interrupt (e.g. PACA_IRQ_DEC -> timer_interrupt), it calls the handler directly with a synthetic pt_regs. The DEFINE_INTERRUPT_HANDLER_ASYNC wrapper around each handler calls arch_interrupt_async_exit_prepare() on the way out, which calls arch_interrupt_exit_prepare() -> local_irq_disable() -> arch_local_irq_disable(), which does: irq_soft_mask_set(IRQS_DISABLED) /* 0x1 */ This unconditionally overwrites irq_soft_mask with IRQS_DISABLED (0x1), stripping the IRQS_PMI_DISABLED (0x2) bit. The result is that irq_soft_mask is 0x1 instead of IRQS_ALL_DISABLED (0x3) when the handler returns to __replay_soft_interrupts(). For a normally-taken interrupt this is harmless: the next interrupt always enters through arch_interrupt_enter_prepare() which unconditionally sets irq_soft_mask to IRQS_ALL_DISABLED. But during replay, next_interrupt() is called directly between replayed handlers without going back through arch_interrupt_enter_prepare(), so the stripped bit is never restored. next_interrupt() then fires a WARNING: WARNING: arch/powerpc/kernel/irq_64.c:75 WARN_ON(irq_soft_mask_return() != IRQS_ALL_DISABLED) The warning was observed early in boot on a POWER10 pseries guest during kmem_cache_init_late(), where a spinlock release triggers interrupt replay that processes a pending timer interrupt. Debugger state confirming the bug: Before timer_interrupt(&regs): irq_soft_mask = 0x3 (IRQS_ALL_DISABLED) correct irq_happened = 0x41 (HARD_DIS|REPLAYING) correct After timer_interrupt(&regs) returns: irq_soft_mask = 0x1 (IRQS_DISABLED) WRONG - PMI bit stripped irq_happened = 0x41 unchanged The fix is to replace local_irq_disable() with hard_irq_disable(). hard_irq_disable() is the right primitive here for two reasons: 1. On PPC64 (hw_irq.h:301) it calls irq_soft_mask_set_return(IRQS_ALL_DISABLED), setting the soft mask to 0x3 (both IRQS_DISABLED and IRQS_PMI_DISABLED), which preserves the PMI bit and fixes the WARNING. The additional work it does (__hard_irq_disable(), PACA_IRQ_HARD_DIS |=) is redundant but safe since both are already set at this point in the exit path; the trace_hardirqs_off() inside is guarded by if (!arch_irqs_disabled_flags(flags)) so it will not double-fire. 2. On PPC32 (hw_irq.h:467) hard_irq_disable() maps to arch_local_irq_disable() -> __hard_irq_disable(), which clears MSR[EE] in hardware. This is exactly correct: PPC32 has no soft-mask PACA mechanism, so the hardware disable is the right way to satisfy irqentry_exit()'s requirement. This also fixes a build error on PPC32 where irq_soft_mask_set() is only defined under CONFIG_PPC64: arch/powerpc/include/asm/entry-common.h:273: error: implicit declaration of function 'irq_soft_mask_set' Using hard_irq_disable() requires no #ifdef and is consistent with how the rest of the entry code (e.g. entry-common.h:463) handles the same PPC32/PPC64 split.

In the Linux kernel, the following vulnerability has been resolved: drm/xe: Guard page-fault worker with runtime PM check During VM teardown, the VM's runtime PM reference is dropped asynchronously, allowing the device to autosuspend while stale page faults belonging to the now-dead VM are still queued. When the page-fault worker later tries to ack one of these, it calls into guc_ct_send_locked() on an already-suspended device, tripping:   Assertion `!xe_pm_runtime_suspended(xe)` failed!   WARNING at xe_device.c:1267 xe_device_assert_mem_access+0x11c/0x140 [xe] A live VM/exec queue always holds a PM reference while it has outstanding work, so if the device is suspended at ack time, the owning context is already gone and the fault is stale. Take a runtime PM reference across the entire pagefault queue worker to safely deliver acks for torn-down VMs. v3: - Move PM ref to the generic xe_pagefault_queue_work using guard(xe_pm_runtime)(xe) instead of tracking it in the GuC backend(Matt Brost). v2: - Hold PM ref across the entire batch (begin/end) instead of per-ack. This prevents the device from autosuspending mid-batch, which would leave write_only acks written but the end flush skipped, and skip counter++, desyncing the cadence check.(Himal) - Add a comment explaining stale faults.(Himal) (cherry picked from commit fcc2431d2213dc4d04250c4f1ae87d9c3ae0d455) [Rodrigo: Added xe_device struct for compatibility while cherry-picking]

In the Linux kernel, the following vulnerability has been resolved: x86/amd_node: Avoid divide by zero on virtualized systems On a virtualized system, the number of nodes does not have a relationship to the number of roots. A Xen PVH dom0 can calculate roots_per_node as 0, which crashes with a divide by zero in: if (count++ % roots_per_node) because the underlying topology code on Xen ends up making num_nodes 2 and num_roots 1 and the integer division result is 0. The issue is seen with Xen, but it could affect other systems. Set roots_per_node to 1 in this case. Print a firmware bug when this is performed for non-virtualized systems. [ bp: Massage commit message. ]

In the Linux kernel, the following vulnerability has been resolved: drm/amdgpu: skip gfx switch_power_profile during GPU reset During resume from GPU reset, the gfx idle work may invoke switch_power_profile before the reset completes. This causes the following assert error because the register access occurs without first releasing the GPU reset semaphore: [ 1576.768935] CR2: 0000559ea133ead0 CR3: 00000002e6c42000 CR4: 0000000000350ef0 [ 1576.768940] Call Trace: [ 1576.768944] <TASK> [ 1576.768953] amdgpu_device_rreg+0x21/0x50 [amdgpu] [ 1576.769158] smu_msg_v1_send_msg+0x1a4/0x6e0 [amdgpu] [ 1576.769437] smu_cmn_send_smc_msg_with_params_ext+0xba/0x120 [amdgpu] [ 1576.769721] smu_cmn_send_smc_msg_with_param+0x33/0x40 [amdgpu] [ 1576.769993] smu_v13_0_0_set_power_profile_mode+0x192/0x2b0 [amdgpu] [ 1576.770267] smu_bump_power_profile_mode+0x5d/0x80 [amdgpu] [ 1576.770538] smu_switch_power_profile+0xa4/0xf0 [amdgpu] [ 1576.770839] amdgpu_dpm_switch_power_profile+0x6f/0x90 [amdgpu] [ 1576.771210] amdgpu_gfx_profile_idle_work_handler+0xe9/0x130 [amdgpu] [ 1576.771460] process_one_work+0x23e/0x6f0 [ 1576.771491] worker_thread+0x1c4/0x380 [ 1576.771506] kthread+0x10c/0x150 [ 1576.771512] ? __pfx_worker_thread+0x10/0x10 [ 1576.771518] ? __pfx_kthread+0x10/0x10 [ 1576.771530] ret_from_fork+0x314/0x390 [ 1576.771537] ? __pfx_kthread+0x10/0x10 [ 1576.771546] ret_from_fork_asm+0x1a/0x30 (cherry picked from commit d93b1ff538ce9750c01e0dd0aa62575579c0fc08)

ONLYOFFICE DocumentServer before 10.0.0 contains an unauthenticated server-side request forgery vulnerability in the /downloadfile/:docid endpoint that allows remote attackers to bypass the private-IP request-filtering-agent by exploiting the isInJwtToken flag when JWT verification is disabled in the default configuration. Attackers can submit a crafted request body containing an internal or loopback URL, which is treated as a DIRECT request skipping private-address filtering, causing the server to fetch and proxy back arbitrary private-network and cloud metadata content.

Missing Authorization vulnerability in Muralidharan Ramasamy Push Notification for Post and BuddyPress push-notification-for-post-and-buddypress allows Exploiting Incorrectly Configured Access Control Security Levels.This issue affects Push Notification for Post and BuddyPress: from n/a through 3.23.

Missing Authorization vulnerability in VideoWhisper.com Paid Videochat Turnkey Site ppv-live-webcams allows Exploiting Incorrectly Configured Access Control Security Levels.This issue affects Paid Videochat Turnkey Site: from n/a through 7.5.12.

Missing authentication for critical function vulnerability in TR7 Cyber ​​Defense Inc. TR7 ASP on virtual appliance and TR7 Cyber ​​Defense Inc. TR7 ASP on physical appliance allows OS Command Injection. This issue affects TR7 ASP: from 1.0.40.236 before 1.0.1554.2331; TR7 ASP: from 1.6.42.239 before 1.6.1554.2331.

Improper neutralization of special elements used in an OS command ('OS command injection') vulnerability in TR7 Cyber ​​Defense Inc. TR7 ASP on virtual appliance and TR7 Cyber ​​Defense Inc. TR7 ASP on physical appliance allows OS Command Injection. This issue affects TR7 ASP: from 1.0.40.236 before 1.0.1554.2331; TR7 ASP: from 1.6.42.239 before 1.6.1554.2331.

Radar before 1.12.2 contains a missing authorization vulnerability in the handleLocalTerminal WebSocket endpoint (/api/local-terminal) that allows authenticated or unauthenticated attackers to spawn a privileged shell by relying only on a runtime-mode check instead of role-based access control. Attackers can connect to the endpoint to execute /bin/bash -l on the Radar host with Radar's own kubeconfig and process credentials injected into the shell environment, achieving remote code execution with Radar's privileges even when the --disable-local-terminal flag is set.

Deserialization of Untrusted Data vulnerability in itthinx Affiliates affiliates allows Object Injection.This issue affects Affiliates: from n/a through 7.0.1.

Missing Authorization vulnerability in Magepeople inc. Bus Ticket Booking with Seat Reservation bus-ticket-booking-with-seat-reservation allows Exploiting Incorrectly Configured Access Control Security Levels.This issue affects Bus Ticket Booking with Seat Reservation: from n/a through 5.9.7.

Improper Neutralization of Input During Web Page Generation ('Cross-site Scripting') vulnerability in Crocoblock JetProductTables jet-product-tables allows Reflected XSS.This issue affects JetProductTables: from n/a through 1.2.4.

Session Fixation vulnerability in VideoWhisper.com Broadcast Live Video videowhisper-live-streaming-integration allows Session Hijacking.This issue affects Broadcast Live Video: from n/a through 7.3.2.

Incorrect Privilege Assignment vulnerability in M A Vinoth Kumar Frontend Dashboard frontend-dashboard allows Privilege Escalation.This issue affects Frontend Dashboard: from n/a through 3.0.7.

Improper Neutralization of Input During Web Page Generation ('Cross-site Scripting') vulnerability in axew3.com WP w3all phpBB wp-w3all-phpbb-integration allows Stored XSS.This issue affects WP w3all phpBB: from n/a through 3.1.0.

Improper Neutralization of Input During Web Page Generation ('Cross-site Scripting') vulnerability in Brainstorm Force SureCart surecart allows Reflected XSS.This issue affects SureCart: from n/a through 4.9.3.

Deserialization of Untrusted Data vulnerability in Brainstorm Force SureCart surecart allows Object Injection.This issue affects SureCart: from n/a through 4.9.3.

Deserialization of Untrusted Data vulnerability in WP SYNTEX Polylang polylang allows Object Injection.This issue affects Polylang: from n/a through 3.8.9.

Missing Authorization vulnerability in miniOrange WP OAuth Server miniorange-oauth-20-server allows Exploiting Incorrectly Configured Access Control Security Levels.This issue affects WP OAuth Server: from n/a through 6.4.0.

libcurl's TFTP state machine fails to validate state transitions against the requested transfer direction, accepting opening server responses for both reads and writes interchangeably. A malicious TFTP server can respond to a download request in a way that forces the client into transmit mode, prompting libcurl to consume and transmit data from the handle's persistent `CURLOPT_READDATA` pointer - including data remaining from unrelated prior operations, such as an HTTP POST request executed on a reused handle.

When an FTP wildcard `LIST` operation fails, libcurl omits the restoration path meant for successful listings, leaving the write callback set to the internal listing parser and the write callback data pointing directly to the easy handle. Subsequent reuse of this handle triggers an immediate crash, and cloning it via `curl_easy_duphandle()` copies this corrupted state into the duplicate. If the original handle is subsequently freed, executing a transfer on the cloned handle causes a heap use-after-free read against the dangling handle reference; alternatively, reusing the original or cloned handle while changing only `CURLOPT_WRITEDATA` (and omitting `CURLOPT_WRITEFUNCTION`) results in type confusion, forcing the internal parser to interpret incoming server response bytes into memory at the application-supplied write data pointer.

When libcurl uses libssh2 with a hashed `known_hosts` file, an unrelated initial entry can cause host key validation to report a key *mismatch* as a *missing* key to the `CURLOPT_SSH_KEYFUNCTION` callback.

Enabling `CURLOPT_CRLF` causes curl to advertise the raw input byte count in the `IMAP APPEND {N}` literal while transmitting line-ending expanded data. The server reads only $N$ bytes for the payload, causing the remaining overflow bytes to be interpreted and executed as pipelined IMAP commands within the authenticated session.

An authenticated HTTPS origin can supply an HSTS `max-age` value that the parser accepts, but time serialization later fails to process. On 64-bit systems, extreme max-age values compute an absolute expiry within standard time integer limits that exceeds calendar time structure bounds. During cache saves, the original HSTS file is truncated before writing a temporary replacement; when serialization fails, the temporary file is deleted, leaving an empty or partial cache. Because the save error is silently ignored during cleanup, curl exits successfully despite the data loss.

An HTTP proxy can trick libcurl into sending the origin's credentials (Basic password, or a Negotiate/Kerberos ticket) to the proxy itself, by answering the `CONNECT` tunnel request with 401 `WWW-Authenticate:` instead of the expected 407 `Proxy-Authenticate:`.

A remote HTTP server can set a cookie that curl accepts and writes to a Netscape cookie jar but cannot reload. On the next invocation using the same path for `--cookie` and `--cookie-jar`, curl fails before connecting, then the cleanup procedure replaces the jar with an empty file, deleting cookies for unrelated domains.

When built with wolfSSL, curl can successfully validate a pinned public key hash against a key the TLS peer does not possess. During the TLS handshake, wolfSSL validates the connection, but curl's subsequent re-parsing of the same certificate - tricked by a manipulated validity length field - extracts and matches a different embedded key, incorrectly authorizing the pinned public key.

When writing a long cookie name and value to a Netscape cookie jar, a remote HTTP server can make `curl` write a record that exceeds its line-length parsing limit. Consequently, any subsequent `curl` invocation reading from that same cookie jar using `--cookie` silently aborts parsing prematurely upon encountering the too long line, ignoring all subsequent valid cookies in the file.

An `ftp://` transfer configured with `CURLUSESSL_NONE` can reuse a pooled FTP control connection that a previous easy handle upgraded with `STARTTLS` and authenticated using a client certificate. The second handle performs neither a new TLS handshake nor a new FTP login, so the server continues to authorize it under the first handle's certificate identity.