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Search Results (395622 CVEs found)
| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-89952 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: mtd: rawnand: validate ONFI extended parameter page sections nand_flash_detect_ext_param_page() allocates the length declared by the ONFI parameter page, then treats the data as a fixed header followed by variable-length sections. It reads that header and advances over sections without first proving that the fixed page and each current section fit in the allocation. Reject pages shorter than the fixed header, track the remaining variable area while walking sections, and require the ECC section to contain every field read from struct onfi_ext_ecc_info. Use device-scoped diagnostics that identify the malformed ONFI section. | ||||
| CVE-2026-89969 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: nvmet-tcp: fix out-of-bounds write when receiving an over-long PDU nvmet_tcp_try_recv_pdu() reads a PDU header into the fixed 128-byte queue->pdu union, then computes the remaining payload length as queue->left = hdr->hlen - queue->offset + hdgst; and reads that many more bytes into &queue->pdu + queue->offset, without ever bounding the result against sizeof(queue->pdu). A struct nvme_tcp_icreq_pdu is itself 128 bytes, exactly the size of the union. Once a header digest has been negotiated (hdgst = 4), a second ICReq passes the hlen == nvmet_tcp_pdu_size() check but yields queue->left = 128 - 8 + 4 = 124, so bytes 8..132 are written into the 128-byte buffer -- 4 bytes past its end, over queue->hdr_digest and queue->data_digest. Those bytes are attacker-controlled (an ICReq carries no digest), and the duplicate ICReq is only rejected later, after the overflow. A remote unauthenticated host can thus corrupt kernel memory adjacent to the receive buffer. Reject any PDU whose declared length would read past the end of queue->pdu before the second recv. | ||||
| CVE-2026-89984 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: perf/x86/intel: Fix kernel address leakages in LBR stack Before Arch LBR gained CPL filtering support, a user-only branch stack could still contain kernel addresses. As a result, kernel branch records may be exposed to user space even when PERF_SAMPLE_BRANCH_USER is requested. For example, on Intel Tiger Lake, the following command can still report SYSRET/ERET entries with kernel-space from addresses: $ ./perf record -e cycles:p -o - --branch-filter any,save_type,u -- \ ./perf bench syscall basic --loop 1000 | \ ./perf script -i - --fields brstack|tr ' ' '\n'| \ grep -E '0x[89a-f][0-9a-f]{15}' Total time: 0.000 [sec] 0.219000 usecs/op 4,566,210 ops/sec [ perf record: Woken up 1 times to write data ] [ perf record: Captured and wrote 0.551 MB - ] 0xffffffff93c001c8/0x7f12a2b1d647/P/-/-/16959/SYSRET/- 0xffffffff93c001c8/0x7f12a2b1d5c2/P/-/-/17535/SYSRET/- 0xffffffff93c01928/0x7f12a2861000/P/-/-/6719/ERET/- 0xffffffff93c01928/0x7f12a297a000/P/-/-/8575/ERET/- The problem is that intel_pmu_lbr_filter() does not fully validate the privilege level of sampled entries. It filters some mismatches based on the branch type and the to address, but it does not reject entries whose from address violates the requested branch privilege filter. Fix this by extending software filtering to validate both from and to addresses against br_sel. Any LBR entry contains kernel address does not match the requested user filter is dropped. This prevents kernel addresses from appearing in user-only branch stacks. | ||||
| CVE-2026-89992 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: cpuidle: dt_idle_genpd: kfree() the original name allocation dt_idle_pd_alloc() kasprintf()s the full node path, then points pd->name at kbasename() of that string. dt_idle_pd_free() kfree()s pd->name, which is no longer the start of the allocation. Copy the basename instead. | ||||
| CVE-2026-90027 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: usb: typec: qcom-pmic-typec: disable cc_debounce_dwork on stop cc_debounce_dwork is queued from the set_cc() and start_toggling() callbacks, which run from TCPM's kthread worker. port_stop() returns before tcpm_unregister_port() destroys that worker. Flushing the worker during unregister may therefore run a callback which queues the delayed work after port_stop() has returned. The delayed work can then run after devres has freed pmic_typec_port. Use disable_delayed_work_sync() in port_stop() to cancel a pending instance and prevent the TCPM callbacks from queueing another one. This issue was found by an in-house static analysis tool. | ||||
| CVE-2026-90030 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: usb: dwc3: clear forceRM when issuing EndTransfer The forceRM bit of the DEPCMD register controls the behavior of the EndTransfer command used to stop an active transfer. Older DWC3 programming guide revisions recommended setting forceRM=1 when issuing EndTransfer. Newer programming guide revisions recommend issuing EndTransfer with forceRM cleared. With forceRM=1 on DWC_usb31 v2.00a and v2.10a controllers, a transfer aborted through the ep_dequeue path was observed to remain active after EndTransfer completion. A subsequent StartTransfer issued on the same endpoint triggered writes associated with the aborted transfer. This resulted in an SMMU fault because the transfer buffer had already been unmapped during EndTransfer command-completion cleanup. Using forceRM=0 eliminates the issue. Although older DWC3 programming guide revisions recommended setting forceRM=1, no issues are known from using forceRM=0. Clear forceRM when issuing EndTransfer to provide consistent EndTransfer behavior and align with newer programming guide recommendations. | ||||
| CVE-2026-19387 | 1 Redhat | 8 Enterprise Linux, Enterprise Linux Eus, Rhel Aus and 5 more | 2026-09-18 | 7.6 High |
| A heap out-of-bounds write vulnerability was found in the GStreamer gst-plugins-bad adpcmdec element when decoding IMA/DVI ADPCM audio. Insufficient validation of the per-block sample count for multi-channel streams allows a crafted WAV file to cause writes beyond the allocated output buffer. This can lead to application crash, denial of service, memory corruption, or potentially arbitrary code execution when untrusted media is processed. | ||||
| CVE-2026-89883 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: media: rc: sunxi-cir: Unregister rc device on probe failure After rc_register_device() succeeds, later probe failures must undo the registration with rc_unregister_device(). The current error path jumps to the allocation cleanup label and only calls rc_free_device(), leaving the rc device registration and resources created by rc_register_device() behind. Add a registered-device unwind label for the IRQ lookup, IRQ request, and hardware initialization failure paths. Keep rc_free_device() for failures before rc_register_device() succeeds. | ||||
| CVE-2026-89932 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: KVM: nVMX: Always flush vpid02 on first use Make sure vpid02 is always flushed on first use by setting last_vpid=0 when allocating vpid02. nested_vmx_transition_tlb_flush() will always detect a VPID change on first VM-Enter after VMXON, because VPID=0 in vmcs12 is not allowed if L1 enables VPID. This avoids using stale TLB entries from a previous lifetime of the VPID, that might have been associated with a different vCPU (or a completely different VM). Note that last_vpid is already being initialized as 0 when the vCPU is created, but it is not reset when vpid02 is freed on VMXOFF. Hence, the problem can only occur if L1 does VMXOFF -> VMXON, runs an L2, and KVM happens to reuse a VPID that has TLB entries on the physical CPU. | ||||
| CVE-2026-89940 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: iio: buffer: Tie IIO dma fence lock lifetime to the fence The `iio_dma_fence` implementation currently uses a lock embedded in the `iio_dmabuf_priv`. But the `iio_dma_fence` can outlive the `iio_dmabuf_priv`, which can cause a use-after-free. Tie the lifetime of the lock to the lifetime of the fence by embedding them in the same struct. We can't just hold a reference to the `iio_dmabuf_priv` from the `iio_dma_fence` since `iio_buffer_dmabuf_release()` might sleep and the fence release callback is not allowed to sleep. Note that the `dma_fence` framework now has an internal lock that gets used when the passing `NULL` for `lock` in `dma_fence_init()`, but in order to allow this patch to be backportable use an external lock. | ||||
| CVE-2026-89941 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: iio: buffer: Make IIO DMA fence release RCU-safe The `dma_fence` documentation states that if a custom release implementation is provided, the `dma_fence` object must be freed in an RCU-safe way. The current `iio_dma_fence` implementation uses `kfree()`, which might result in a use-after-free. Remove the custom `release` implementation. This makes the DMA fence core fall back to `dma_fence_free()`, which calls `kfree_rcu()` on the fence. This requires that the fence be the first member of `struct iio_dma_fence`. Using the default release method for extended DMA fence structures is a common pattern. | ||||
| CVE-2026-89944 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: ASoC: hdac_hda: Fix hlink refcount leak on component registration failure hdac_hda_dev_probe() gets the HDA link with snd_hdac_ext_bus_link_get() before registering the ASoC component. If component registration fails, the function returns without dropping the link reference. Always call snd_hdac_ext_bus_link_put() after the registration attempt so the reference taken during probe is balanced on both success and failure. | ||||
| CVE-2026-89945 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: ASoC: cs35l34: drain threaded IRQ before runtime suspend cs35l34_runtime_suspend() currently switches the codec into regcache_cache_only(true), asserts reset low, and powers the device off without first quiescing the threaded IRQ registered by devm_request_threaded_irq(). That leaves a window where cs35l34_irq_thread() can still run after suspend has removed live hardware access. A running system can reach this during runtime PM while the driver still has critical fault IRQs unmasked. If the threaded handler runs in that window, it reads volatile INT_STATUS_1..4 after cache_only has been enabled, ignores the regmap_read() failures, and can still execute the PROT_RELEASE_CTL release sequence or the BST fault power-down writes. Use disable_irq() before entering cache_only/reset-low/power-off so any in-flight threaded handler is drained and no new IRQ thread can run while the device is suspended. Re-enable the IRQ only after runtime_resume() has restored live register access with regcache_sync(). Since probe only logs request_threaded_irq() failures and keeps going, track whether the IRQ was actually installed before disabling or re-enabling it. | ||||
| CVE-2026-89954 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 8 High |
| In the Linux kernel, the following vulnerability has been resolved: mtd: afs: validate v2 image info bounds The AFS v2 parser uses footer[8] to locate the image information block inside the current erase block, then uses the image information region_count to walk entries from a fixed local array. The footer offset and region count come from flash contents and are not checked against the erase block or the local image-info array before use. Reject v2 entries whose image information offset would underflow the erase block calculation, and reject region counts that cannot fit in the local image-info array before walking region entries. | ||||
| CVE-2026-89972 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 9.8 Critical |
| In the Linux kernel, the following vulnerability has been resolved: nvme: add missing SRCU grace period in error path nvme_alloc_ns() error path at out_unlink_ns removes ns from the namespace head siblings list with list_del_rcu(&ns->siblings) but does not wait for SRCU readers before freeing the namespace struct. Multipath code iterates the head->list under srcu_read_lock() in nvme_find_path() and nvme_mpath_revalidate_paths(), so a concurrent reader can still hold a reference to ns when kfree(ns) runs. The normal removal path in nvme_ns_remove() correctly calls synchronize_srcu(&ns->head->srcu) after list_del_rcu() to wait for in-progress readers. Add the same grace period in the error path. | ||||
| CVE-2026-89980 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: ALSA: harmony: initialize locks before requesting IRQ snd_harmony_create() registers the IRQ before initializing h->lock and h->mixer_lock. A pending interrupt can invoke the handler while these locks are uninitialized. Initialize both locks before requesting the IRQ so the handler always sees valid lock state. | ||||
| CVE-2026-89982 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: i2c: mux: Fix channel node leak on adapter add failure i2c_mux_add_adapter() takes a reference to the Device Tree channel node before registering the new adapter. If adapter registration fails, the error path frees the private data without dropping that reference. Release the channel node before freeing the private data. | ||||
| CVE-2026-89994 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: dmaengine: fsl-edma: tracing: no ptr dereference during log output The fsl edma events store a pointer to a struct fsl_edma_engine in the ringbuffer and dereference it when a log entry is printed. At this time, the pointer may no longer be valid. Event injection can be used to trigger a crash: $ cd /sys/kernel/tracing $ echo 'value = 0' > events/fsl_edma/edma_writeb/inject $ cat trace The log output needs only edma->membase. Add a membase field at the end of the event and use the new field for log output. Keep the existing fields for backward compatibility. | ||||
| CVE-2026-89997 | 1 Linux | 1 Linux Kernel | 2026-09-18 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: dm: fix resume-vs-remove race If the user issues the resume ioctl and the remove ioctl at the same time, it may be possible that the device is resumed after it is suspended in __dm_destroy. The result is that the table is destroyed without calling the postsuspend method. Dm targets expect that they may be removed only after the postsuspend method method was called. If we break this expectation, it can cause misbehavior in various targets. For example - in the dm-integrity target, the reboot notifier is not unregistered, leading to use-after-free. Fix this bug by refusing to resume if the device is being destroyed. | ||||
| CVE-2026-90015 | 1 Linux | 1 Linux Kernel | 2026-09-18 | N/A |
| In the Linux kernel, the following vulnerability has been resolved: xhci: fix lost bounce buffers on TDs spanning several ring segments When a TD reaches a link TRB with data that is not aligned to the endpoint's wMaxPacketSize, xhci_align_td() stages the unalignable tail through the bounce buffer of the ring segment holding that link TRB. xhci_unmap_td_bounce_buffer() later unmaps it and, for IN transfers, copies the data back into the URB's buffer. The enqueue path records the segment that was bounced in td->bounce_seg, under the assumption that a TD never spans more than two ring segments. That assumption does not hold: a TD large enough to span three or more segments crosses several link TRBs and can be bounced at each of them. Only the last one survives in td->bounce_seg, so every earlier bounce buffer is neither copied back nor DMA unmapped. The URB still completes with actual_length equal to the requested length and no error, so the transfer looks successful while a wMaxPacketSize sized hole in the destination buffer silently keeps its previous contents. It also leaks a DMA mapping per dropped bounce. Any sufficiently large and fragmented bulk transfer can hit this. It was found with a USB mass storage device behind xHCI backing a dm-verity target with 512 byte hash blocks, where the stale data is detected rather than silently consumed. The device enumerates as SuperSpeed, so wMaxPacketSize is 1024, while dm-bufio issues one 512 byte bio per hash block. verity_prefetch_io() makes the block layer merge hundreds of them into a single request of up to 512 scatterlist entries of 512 bytes each. At 256 TRBs per ring segment such a TD spans three segments, and every segment boundary falls on an odd multiple of 512, i.e. unaligned to wMaxPacketSize. dm-bufio then caches a hash block holding stale data and dm-verity declares the metadata block corrupted: device-mapper: verity: 8:2: metadata block 10850 is corrupted A reproducer running this under qemu is available at https://github.com/baloo/xhci-verity The bounce state (bounce_buf, bounce_dma, bounce_len, bounce_offs) already lives on the ring segment, so there is nothing extra to track. Keep recording the last bounced segment in td->bounce_seg and, on completion, walk the segments from td->start_seg up to it, unmapping every segment that still has a pending bounce. Stopping at td->bounce_seg rather than td->end_seg matters: a bounce implies the TD continues past that segment's link TRB, so bounce_seg is always strictly before end_seg, and a later TD may already have started in end_seg and been bounced there. Walking that far would copy a foreign bounce buffer into this URB and unmap it twice. It also keeps the walk correct if a TD ever wraps the whole ring so that end_seg == start_seg. [mn: Add ring->num_segs check to prevent unlikely infinite for loop.] | ||||