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| CVE | Vendors | Products | Updated | CVSS v3.1 |
|---|---|---|---|---|
| CVE-2026-79658 | 1 Ech0 | 1 Ech0 | 2026-08-25 | 7.5 High |
| Ech0 before 5.0.1 does not impose any size or shape limit on the Accept-Language header processed by its i18n middleware, which runs on every HTTP request. The header is passed unfiltered to go-i18n's NewLocalizer, which internally calls golang.org/x/text/language.ParseAcceptLanguage. The CVE-2022-32149 mitigation in x/text caps '-' characters but not '_' characters, which the parser aliases to '-', allowing quadratic-time parsing to be triggered with a large header (up to Go's default 1 MiB) built from underscore separators. An unauthenticated attacker can send such requests to consume roughly 1.5 seconds of CPU each, and concurrent requests can saturate a multi-core server (denial of service). | ||||
| CVE-2026-78684 | 1 Vllm | 1 Vllm | 2026-08-25 | 5.3 Medium |
| vLLM before 0.27.0 fails to properly classify DeepStream as a GPU backend and omits pixel-limit enforcement in its decode path. Unauthenticated attackers can activate DeepStream at request time to initialize the process-wide GPU decode pool and submit video that bypasses resource controls, causing partial denial of service for concurrent requests. | ||||
| CVE-2026-49845 | 1 Apache | 1 Hive | 2026-08-25 | N/A |
| SQL injection in Hive Metastore direct SQL partition-name resolution in Apache Hive before 4.2.1 on all platforms allows authenticated users with access to Hive Metastore APIs to read, modify, or affect unintended partition metadata (including statistics updates, truncation targets, and file-metadata cache operations) via crafted partition names in metastore RPC requests when direct SQL is enabled (the default). Users are recommended to upgrade to version 4.2.1, which fixes this issue. Details about the issue: Several Hive Metastore RPCs resolve partitions by full partition name (PART_NAME) through direct-SQL helpers. In those paths, client-supplied partition names are embedded into SQL using string concatenation (DirectSqlUpdatePart.quoteString() → '...') instead of bind parameters. A partition name containing a single quote (and crafted SQL) can alter the generated WHERE clause so that lookups intended for one partition match additional rows. That can affect reads, stats updates, truncate targets, metadata-cache targets, and related operations when metastore.try.direct.sql is enabled (default: true). An authenticated or network-trusted caller with the ability to invoke Hive Metastore partition-name APIs against a target table (directly or via Hive/other clients), when direct SQL is enabled can perform this attack. Also, the impact is mainly within table & partition targeting (read/update/truncate/drop/cache the wrong partitions in a table they can reference), not arbitrary cross-database access via this bug alone. | ||||
| CVE-2026-78570 | 2 Klbtheme, Wordpress | 2 Total Donations, Wordpress | 2026-08-25 | 9.8 Critical |
| The Total Donations plugin for WordPress is vulnerable to Privilege Escalation in all versions up to, and including, 2.0.5. This makes it possible for unauthenticated attackers to elevate their privileges to that of an adminsitrator. | ||||
| CVE-2026-49050 | 1 Apache | 1 Dolphinscheduler | 2026-08-25 | N/A |
| General user can mint admin access tokens via /access-tokens This issue affects Apache DolphinScheduler: before 3.4.2. Users are recommended to upgrade to version 3.4.2, which fixes the issue. | ||||
| CVE-2026-77824 | 2026-08-25 | 4.9 Medium | ||
| The Media Sweep – WordPress Media Cleaner plugin for WordPress is vulnerable to generic SQL Injection via the 'fields' parameter in all versions up to, and including, 1.1.3 due to insufficient escaping on the user supplied parameter and lack of sufficient preparation on the existing SQL query. This makes it possible for authenticated attackers, with administrator-level access and above, to append additional SQL queries into already existing queries that can be used to extract sensitive information from the database. | ||||
| CVE-2026-17587 | 2026-08-25 | 5.3 Medium | ||
| The My Agile Privacy® – CMP, Cookie Consent & Privacy Tools plugin for WordPress is vulnerable to authorization bypass in all versions up to, and including, 3.3.6. This is due to the plugin not properly verifying that a user is authorized to perform an action. This makes it possible for unauthenticated attackers to modify plugin settings including missing_cookie_shield, cookie_shield_running, cmode_v2_js_on_error, cmode_v2_js_error_code, and cmode_v2_js_error_motivation stored in the plugin's settings key. | ||||
| CVE-2026-19949 | 2026-08-25 | 8.8 High | ||
| The All-in-One WP Migration and Backup plugin for WordPress is vulnerable to SQL Injection via archive restore functionality in all versions up to, and including, 7.109 due to insufficient escaping on the user supplied parameter and lack of sufficient preparation on the existing SQL query. This makes it possible for unauthenticated attackers to append additional SQL queries into already existing queries that can be used to extract sensitive information from the database. This can be leveraged to obtain the ai1wm_secret_key when a site administrator performs an archive restore and achieve remote code execution once able to leverage the ai1wm_secret_key value. | ||||
| CVE-2026-79652 | 1 Redhat | 2 Build Keycloak, Red Hat Single Sign On | 2026-08-25 | 5.9 Medium |
| A flaw was found in the JWT Bearer authorization grant implementation within the keycloak-services component of Red Hat Build of Keycloak. This component handles various OAuth2 and OpenID Connect grant types used for issuing access tokens. The issue occurs because the JWT Bearer grant fails to check if a client requires user consent before issuing a token. This allows an authenticated attacker with valid client credentials and a trusted identity provider assertion to bypass the consent requirement and obtain unauthorized access to a user account at a consent-gated client. | ||||
| CVE-2026-74604 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: Revert "thermal/drivers/hwmon: Cleanup coding style a bit" Revert commit 030a48b0f6ce ("thermal/drivers/hwmon: Cleanup coding style a bit") that introduced a use-after-free into the error path of thermal_add_hwmon_sysfs() by removing a valid check from it. | ||||
| CVE-2026-74629 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: net/dibs: Correct freeing of dmb_clientid_arr A dibs device interrupt handler can be active after dibs_dev_del() and may still access dmb_clientid_arr. (UAF) In case of a failure in dibs_dev_add() being called by dibs_lo_dev_probe() dmb_clientid_arr is freed twice (double free). Free dmb_clientid_arr in dibs_dev_release() after last reference is gone. Note that allocating in dibs_dev_add() instead of dibs_dev_alloc() is ok for now, because no dmbs can be registered before dibs_dev_add(). | ||||
| CVE-2026-74726 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 7.3 High |
| In the Linux kernel, the following vulnerability has been resolved: bonding: alb: re-check primary_is_promisc under RTNL in bond_alb_monitor bond_alb_monitor() reads primary_is_promisc under RCU, then drops RCU and takes RTNL via rtnl_trylock() before undoing the promiscuity it set on the active slave. In that window the active slave can change under RTNL (RTM_DELLINK -> __bond_release_one() -> bond_alb_handle_active_change()), which already drops the promiscuity and clears primary_is_promisc. The monitor still acts on the stale decision: if the slave was removed with no failover, curr_active_slave is now NULL and the deref faults; if it failed over, the stale dev_set_promiscuity(-1) underflows the new slave's promiscuity counter and pins it in IFF_PROMISC. Oops: general protection fault, probably for non-canonical address ... KASAN: null-ptr-deref in range [0x0000000000000000-0x0000000000000007] Workqueue: b42 bond_alb_monitor RIP: 0010:bond_alb_monitor (drivers/net/bonding/bond_alb.c:1600) process_one_work (kernel/workqueue.c:3322) worker_thread (kernel/workqueue.c:3486) kthread (kernel/kthread.c:436) ret_from_fork (arch/x86/kernel/process.c:158) Kernel panic - not syncing: Fatal exception Re-check primary_is_promisc (and curr_active_slave) after taking RTNL so the monitor only undoes an increment it still owns. The other bonding monitors already re-read state under RTNL in their commit phase (bond_miimon_commit/bond_ab_arp_commit); bond_alb_monitor() was the only one acting on the pre-trylock decision. | ||||
| CVE-2026-74655 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 8.8 High |
| In the Linux kernel, the following vulnerability has been resolved: serial: qcom-geni: fix TX DMA buffer flush When transmit flushing a qcom-geni UART during an ongoing TX DMA, the UART gets stuck infinitely repeating corrupted TX DMA frames. The DMA-mode uart_ops does not provide a flush_buffer callback, so an in-flight transfer can complete after serial core has reset the transmit kfifo, underflowing its length and resubmitting page-sized transfers indefinitely. Add one that stops the transfer and clears tx_remaining and tx_queued. The stop path was also broken: it unmapped the buffer while the serial engine could still read it, and never reset the TX DMA state machine. Cancel the main sequencer command first, then reset the state machine and wait for it before unmapping. Drop the early return so a pending mapping is also cleaned up when the main command is inactive. The bug can be triggered from userspace with a large write immediately followed by TCOFLUSH. A following tcdrain will hang forever. The bug was reproduced and this fix was validated on Arduino Uno Q (QRB2210) using /dev/ttyHS1. | ||||
| CVE-2026-78863 | 1 Liketrek | 1 Trek | 2026-08-25 | 6.3 Medium |
| A vulnerability was found in liketrek TREK up to 3.0.22. Impacted is the function loginUser of the file server/src/services/authService.ts of the component Pre-2FA mfa_token Handler. The manipulation results in improper authentication. The attack may be performed from remote. Upgrading to version 3.1.0 is recommended to address this issue. Upgrading the affected component is recommended. | ||||
| CVE-2026-74665 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 9.1 Critical |
| In the Linux kernel, the following vulnerability has been resolved: net: fix skb length accounting after generic XDP frag adjustment Generic XDP exposes non-linear skb fragments through an xdp_buff. If an XDP program adjusts the fragment area, bpf_prog_run_generic_xdp() copies xdp_frags_size back to skb->data_len but leaves skb->len containing the old fragment contribution. After a fragment shrink, this makes skb_headlen() larger than the actual linear area. In the reproduced UDP receive path, __skb_datagram_iter() copied 1024 bytes past the actual linear tail to userspace, starting at struct skb_shared_info. The copied bytes included the affected skb's nr_frags, xdp_frags_size and a kernel pointer from skb_shinfo(skb)->frags[0]. Real packet data was displaced by the same amount and truncated at the end. Subtract the old data_len before replacing it and add the new data_len afterwards, keeping skb->len and skb->data_len synchronized. A 60000-byte UDP datagram on a veth pair with MTU 64000 was shortened by 1024 bytes from its fragment area. Before the fix, all 10 runs produced corrupted payloads. After the fix, all 10 runs matched the expected payload exactly. | ||||
| CVE-2026-74674 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: mm: fix incorrect flush address in direct page table reclaim When zap_pte_range reclaims a page table, it does: pte_free_tlb(tlb, pmd_pgtable(pmdval), addr); and this is unconditionally wrong: if this code executes, addr *always* points one past the end of the range covered by the table. The addr parameter is used to flush the TLB (really the paging-structure-cache) to drop references to the to-be-freed table, and any architecture that cares about the parameter will flush the wrong address. (But they'll still free the correct page). I think it's worth contemplating why the kernel works at all. If we hit the offending line of code, we will first clear the PMD entry (line 1954, zap_empty_pte_table), then we will issue pending flushes if force_flush is set (tlb_flush_mmu_tlbonly(tlb)), then we will skip the retry on line 1979 (phew!), and then we will do the offending pte_free_tlb call. *Or* we will clear the PMD entry immediately before pte_free_tlb (line 1983, zap_pte_table_if_empty). If we have any pending flushes (i.e. we actually zapped any last-level entries) at the time we clear the PMD entry, then the flush really ought to flush all references to the table (Linus certainly seems to think it will on all architectures [0]). The condition under which we have no accumulated flushes at the time of the clear is very complex (the whole zap_pte_range function has absurdly complex control flow). If we do hit the bad case, then we will end up clearing the PMD entry after the last time the range is flushed, and any CPU is free to cache a reference to the (empty) page table. If this happens due to an ordinary read or write, it would segfault, so it would be rare. But the cache could be speculatively filled as well. Then we'll flush the wrong address and then free and possibly reuse the table. On x86, even flushing the wrong address works on non-KPTI Intel systems because INVLPG flushes *all* paging-structure-caches, not just the ones for the target address. But INVPCID does not, and flush_tlb_one_user will use INVPCID if it's available. And then we're toast. AMD systems are more susceptible: we set the EFER.TCE bit, which makes even INVLPG only flush the target address. I think this might fix an issue in ripgrep reported here: https://github.com/BurntSushi/ripgrep/issues/3494 [0] https://lore.kernel.org/all/CA+55aFzBggoXtNXQeng5d_mRoDnaMBE5Y+URs+PHR67nUpMtaw@mail.gmail.com/T/#u | ||||
| CVE-2026-74692 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 7.5 High |
| In the Linux kernel, the following vulnerability has been resolved: net/smc: fix TOCTOU race between smc_listen_out() and listener close smc_listen_out() reads lsmc->sk.sk_state without the listener lock, then acquires lock_sock_nested() only after the check passes. This opens a window where smc_close_active() can transition the listener to SMC_CLOSED, call smc_close_cleanup_listen() to drain the accept queue, and release the lock, all between the lockless read and the delayed lock acquisition: smc_listen_work (smc_hs_wq) smc_close_active() ------------------------------- ------------------------- release_sock(child) if (sk_state == SMC_LISTEN) TRUE lock_sock(listener) sk_state = SMC_CLOSED smc_close_cleanup_listen() release_sock(listener) flush_work(tcp_listen_work) lock_sock_nested(listener) smc_accept_enqueue(listener, child) /* child enqueued on dead listener */ smc_close_active() flushes only tcp_listen_work. Work items already dispatched onto smc_hs_wq for the CLC handshake continue running unguarded. smc_accept_enqueue() takes a sock_hold() on the child that is never released, so the child smc_sock, its clcsock, and the reference all leak. A remote peer that opens TCP connections while the server calls close() can exhaust kernel memory. Move lock_sock_nested() to before the sk_state check so that the test and the enqueue are atomic under the listener lock. | ||||
| CVE-2026-74701 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 7.8 High |
| In the Linux kernel, the following vulnerability has been resolved: net/openvswitch: check Ethernet header length in key_extract() When a packet arrives on an ARPHRD_NONE device (e.g. TUN), ovs_flow_key_extract() trusts the user-provided skb->protocol field: if it is ETH_P_TEB, the packet is classified as MAC_PROTO_ETHERNET and key_extract() is called without ensuring the skb has ETH_HLEN (14) bytes of linear data. key_extract() unconditionally pulls 2 * ETH_ALEN bytes for MAC addresses and parse_ethertype() pulls 2 more, either of which triggers a kernel BUG in __skb_pull() when the linear area is too small. kernel BUG at include/linux/skbuff.h:2848! RIP: 0010:key_extract+0xa7e/0xd90 net/openvswitch/flow.c:933 ovs_flow_key_extract+0x419/0xa70 ovs_vport_receive+0x222/0x390 netdev_frame_hook+0x3e0/0x630 tun_get_user+0x2d0c/0x38e0 Fixed by calling check_header() in key_extract() before accessing the Ethernet header. | ||||
| CVE-2026-74711 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 8.4 High |
| In the Linux kernel, the following vulnerability has been resolved: hwmon: (pmbus) Fix type confusion in notification logic Sashiko reports: At the start of the loop in pmbus_notify(), the code unconditionally casts every attribute to a struct sensor_device_attribute: drivers/hwmon/pmbus/pmbus_core.c:pmbus_notify() { for (i = 0; i < data->num_attributes; i++) { struct device_attribute *da = to_dev_attr(data->group.attrs[i]); struct sensor_device_attribute *attr = to_sensor_dev_attr(da); int index = attr->index; ... } However, data->group.attrs can contain other types like struct pmbus_samples_reg or struct pmbus_sensor, which only embed a base struct device_attribute. If da is a struct pmbus_samples_reg, dev_attr is the last member. Casting it to struct sensor_device_attribute and reading the index field appears to access memory past the end of the allocation, which might trigger a slab-out-of-bounds read. Additionally, if da is a struct pmbus_sensor, casting it causes the index field to overlap with the page, phase, and reg fields. Could this produce a garbage mask on little-endian systems that spuriously matches the target reg, page, and flags during an alert? Fix the problem by using struct sensor_device_attr in struct pmbus_sensor and struct pmbus_label. Since those attributes never trigger a notification, set the value of attr->index to -1 for them. Use this value to distinguish from boolean attributes which _can_ trigger a notification and use the index field to encode mask, page, and register values. | ||||
| CVE-2026-74713 | 1 Linux | 1 Linux Kernel | 2026-08-25 | 7.1 High |
| In the Linux kernel, the following vulnerability has been resolved: vhost_iotlb: bound map allocation in add_range vhost_iotlb_add_range_ctx() only retires an old entry when the table has a non-zero limit, has exactly reached that limit and has VHOST_IOTLB_FLAG_RETIRE set. Non-retiring tables can keep allocating entries after reaching their configured limit. Existing vhost devices allocate their IOTLB with max_iotlb_entries from vhost.c, which defaults to 2048 and is tunable by module parameter. Use the caller-provided limit at the allocation point instead of adding a separate default in the common IOTLB helper, and reject non-positive values in vhost paths that can report an error. Other vhost IOTLB users should not create zero-limit tables when entries can be populated from userspace or guest-controlled requests. Add caller-side max_iotlb_entries parameters for mlx5 vDPA, VDUSE and vhost-vDPA. Reject non-positive VDUSE and vhost-vDPA values, and require at least two entries for vdpa_sim and mlx5 vDPA paths that install full-range mappings, since those mappings are split into two IOTLB entries. Handle full-range mappings in the common helper by checking that the IOTLB can hold both split entries before inserting the first half. This avoids returning an error after leaving a half mapping behind. When the table is full, keep the existing retire behavior for retiring tables and return -ENOSPC for non-retiring tables. Reuse the retired map node instead of freeing it and allocating a replacement, so a stream of IOTLB updates cannot keep forcing GFP_ATOMIC allocations after the table has reached its limit. If a zero-limit IOTLB still reaches the common helper, treat it as a configuration error and return -EINVAL. I found this bug myself, though the patch was written with AI assistance. | ||||