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  • Are spurious TCP connections on port 53 a problem?

    - by Darren Greaves
    I run a server which amongst other things uses tinydns for DNS and axfrdns for handling transfer requests from our secondary DNS (another system). I understand that tinydns uses port 53 on UDP and axfrdns uses port 53 on TCP. I've configured axfrdns to only allow connections from my agreed secondary host. I run logcheck to monitor my logs and every day I see spurious connections on port 53 (TCP) from seemingly random hosts. They usually turn out to be from ADSL connections. My question is; are these innocent requests or a security risk? I am happy to block repeat offenders using iptables but don't want to block innocent users of one of the websites I host. Thanks, Darren.

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  • C# Role Provider for multiple applications

    - by Juventus18
    I'm making a custom RoleProvider that I would like to use across multiple applications in the same application pool. For the administration of roles (create new role, add users to role, etc..) I would like to create a master application that I could login to and set the roles for each additional application. So for example, I might have AppA and AppB in my organization, and I need to make an application called AppRoleManager that can set roles for AppA and AppB. I am having troubles implementing my custom RoleProvider because it uses an initialize method that gets the application name from the config file, but I need the application name to be a variable (i.e. "AppA" or "AppB") and passed as a parameter. I thought about just implementing the required methods, and then also having additional methods that pass application name as a parameter, but that seems clunky. i.e. public override CreateRole(string roleName) { //uses the ApplicationName property of this, which is set in web.config //creates role in db } public CreateRole(string ApplicationName, string roleName) { //creates role in db with specified params. } Also, I would prefer if people were prevented from calling CreateRole(string roleName) because the current instance of the class might have a different applicationName value than intended (what should i do here? throw NotImplementedException?). I tried just writing the class without inheriting RoleProvider. But it is required by the framework. Any general ideas on how to structure this project? I was thinking make a wrapper class that uses the role provider, and explicitly sets the application name before (and after) and calls to the provider something like this: static class RoleProviderWrapper { public static CreateRole(string pApplicationName, string pRoleName) { Roles.Provider.ApplicationName = pApplicationName; Roles.Provider.CreateRole(pRoleName); Roles.Provider.ApplicationName = "Generic"; } } is this my best-bet?

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  • Is LINQ to objects a collection of combinators?

    - by Jimmy Hoffa
    I was just trying to explain the usefulness of combinators to a colleague and I told him LINQ to objects are like combinators as they exhibit the same value, the ability to combine small pieces to create a single large piece. Though I don't know that I can call LINQ to objects combinators. I've seen 2 levels of definition for combinator that I generalize as such: A combinator is a function which only uses things passed to it A combinator is a function which only uses things passed to it and other standard atomic functions but not state The first is very rigid and can be seen in the combinatory calculus systems and in haskell things like $ and . and various similar functions meet this rule. The second is less rigid and would allow something like sum as it uses the + function which was not passed in but is standard and not stateful. Though the LINQ extensions in C# use state in their iteration models, so I feel I can't say they're combinators. Can someone who understands the definition of a combinator more thoroughly and with more experience in these realms give a distinct ruling on this? Are my definitions of 'combinator' wrong to begin with?

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  • I'm confused about encryption and SSL

    - by ChowKiko
    while my friends and I planning to run our own website, we're confused about the encryption where hackers can TAPPING or in social engineering it's WIRE TAPPING, but I don't know how do they call it in Computers today... Well guys, I just want to know how encryption works with websites if we are using PHP+MYSQL? Is it ok to use user login ---- (PHP) encrypt inputted value then (PHP) will decrypt and validate it going to (MySQL) user login ---- (PHP) encrypt inputted value and decrypt the (MySQL) data if they are similar... Is it similar if we use $_SESSION without encryption inside PHP going to MySQL?or PHP encryption also helps the manipulation of binaries?..I'm so confused T_T... In regards to what I stated above, can a hacker hook the data if the server uses $_SESSION? Is $_SESSION safe?... IF THE HACKER CAN HOOK it? is it necessary to use SSL on our website? and why do some Merchandise websites use SSL and likewise facebook also uses SSL? what is the best suit for you if there is no SSL? encrypting the DATA using PHP going to MySQL or even without encryption while the PHP server uses $_SESSION?...

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  • Can I use all my RAM for application data?

    - by gsedej
    Hi! I have yet another question about "where is my Linux memory" Question goes: can I use cache for application data? On my laptop I have 1GB ram. Situation after some time of work: browser takes 400MB and all other apps caa 300MB (quickly summed in system monitor). System monitor says I use 90% of RAM and I have already 200MB on swap. Laptop is getting slower when I start new things (e.g. open new tab in browser or open new Nautilus window). probably putting memory on swap So there should be 1200MB (ram+swap) used but all app I see uses only 600MB. Where are other 600MB? Out of this 600MB there is 400MB real RAM. I am not copying or any other massive IO activity. I read about Linux smartly uses all ram it has using buffers and cache. So, kernel (cache) uses 300MB. What if I don't want to have disk mirrored and I want to use memory for application data (e.g. new browser tab)? I don't need 200MB of mirrored disk data, because I (for example) won't use open the same photos on data partition I just seen. So can I use all my RAM for application data? (including browser, desktop, xorg, other services). How?

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  • Positioning a sprite in XNA: Use ClientBounds or BackBuffer?

    - by Martin Andersson
    I'm reading a book called "Learning XNA 4.0" written by Aaron Reed. Throughout most of the chapters, whenever he calculates the position of a sprite to use in his call to SpriteBatch.Draw, he uses Window.ClientBounds.Width and Window.ClientBounds.Height. But then all of a sudden, on page 108, he uses PresentationParameters.BackBufferWidth and PresentationParameters.BackBufferHeight instead. I think I understand what the Back Buffer and the Client Bounds are and the difference between those two (or perhaps not?). But I'm mighty confused about when I should use one or the other when it comes to positioning sprites. The author uses for the most part Client Bounds both for checking whenever a moving sprite is of the screen and to find a spawn point for new sprites. However, he seems to make two exceptions from this pattern in his book. The first time is when he wants some animated sprites to "move in" and cross the screen from one side to another (page 108 as mentioned). The second and last time is when he positions a texture to work as a button in the lower right corner of a Windows Phone 7 screen (page 379). Anyone got an idea? I shall provide some context if it is of any help. Here's how he usually calls SpriteBatch.Draw (code example from where he positions a sprite in the middle of the screen [page 35]): spriteBatch.Draw(texture, new Vector2( (Window.ClientBounds.Width / 2) - (texture.Width / 2), (Window.ClientBounds.Height / 2) - (texture.Height / 2)), null, Color.White, 0, Vector2.Zero, 1, SpriteEffects.None, 0); And here is the first case of four possible in a switch statement that will set the position of soon to be spawned moving sprites, this position will later be used in the SpriteBatch.Draw call (page 108): // Randomly choose which side of the screen to place enemy, // then randomly create a position along that side of the screen // and randomly choose a speed for the enemy switch (((Game1)Game).rnd.Next(4)) { case 0: // LEFT to RIGHT position = new Vector2( -frameSize.X, ((Game1)Game).rnd.Next(0, Game.GraphicsDevice.PresentationParameters.BackBufferHeight - frameSize.Y)); speed = new Vector2(((Game1)Game).rnd.Next( enemyMinSpeed, enemyMaxSpeed), 0); break;

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  • 802.11 Capture Frame

    - by ALi
    I am using wireshark in monitor mode to capture all the frame. I buffered all the QosData in order to calculate the biterate of each station on the network. I calculate the biterate but it is not an accurate value. what i need to know is when the station use the network alone and when it uses it with another station? i know if two station with different wifi card for exemple ( st1 802.11g 54 Mb/s, st2 802.11n 300 Mb/s) if st1 uses alone the line the biterate used is 28 MB/s and if st2 uses alone the network the bit rate increase to approximately 150Mb/s but if the two station use the network at the same time the st1 lost about 80% of its bit rate because of the st1 wifi card thx in advance

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  • Graph data structures and journal format for mini-IDE

    - by matec
    Background: I am writing a small/partial IDE. Code is internally converted/parsed into a graph data structure (for fast navigation, syntax-check etc). Functionality to undo/redo (also between sessions) and restoring from crash is implemented by writing to and reading from journal. The journal records modifications to the graph (not to the source). Question: I am hoping for advice on a decision on data-structures and journal format. For the graph I see two possible versions: g-a Graph edges are implemented in the way that one node stores references to other nodes via memory address g-b Every node has an ID. There is an ID-to-memory-address map. Graph uses IDs (instead of addresses) to connect nodes. Moving along an edge from one node to another each time requires lookup in ID-to-address map. And also for the journal: j-a There is a current node (like current working directory in a shell + file-system setting). The journal contains entries like "create new node and connect to current", "connect first child of current node" (relative IDs) j-b Journal uses absolute IDs, e.g. "delete edge 7 - 5", "delete node 5" I could e.g. combine g-a with j-a or combine g-b with j-b. In principle also g-b and j-a should be possible. [My first/original attempt was g-a and a version of j-b that uses addresses, but that turned out to cause severe restrictions: nodes cannot change their addresses (or journal would have to keep track of it), and using journal between two sessions is a mess (or even impossible)] I wonder if variant a or variant b or a combination would be a good idea, what advantages and disadvantages they would have and especially if some variant might be causing troubles later.

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  • Should we encourage coding styles in favor of developer's autonomy, or discourage it in favor of consistency?

    - by Saeed Neamati
    A developer writes if/else blocks with one-line code statements like: if (condition) // Do this one-line code else // Do this one-line code Another uses curly braces for all of them: if (condition) { // Do this one-line code } else { // Do this one-line code } A developer first instantiates an object, then uses it: HelperClass helper = new HelperClass(); helper.DoSomething(); Another developer instantiates and uses the object in one line: new HelperClass().DoSomething(); A developer is more easy with arrays, and for loops: string[] ordinals = new string[] {'First', 'Second', 'Third'}; for (i = 0; i < ordinals.Length; i++) { // Do something } Another writes: List<string> ordinals = new List<string>() {'First', 'Second', 'Third'}; foreach (string ordinal in ordinals) { // Do something } I'm sure that you know what I'm talking about. I call it coding style (cause I don't know what it's called). But whatever we call it, is it good or bad? Does encouraging it have an effect of higher productivity of developers? Should we ask developers to try to write code the way we tell them, so to make the whole system become style-consistent?

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  • Quickbooks Error - Can't turn off auto updates

    - by Murtez
    My company uses quickbooks pro 2002 and unfortunately they won't upgrade at this time, the program keeps freezing and giving methe error: This action cannot be completed because this program is busy.. Then asks to switch or retry, I tracked it down to being an issue with IE since it's an old program and can't use the new versions of IE (the program uses IE for it's interface for some STUPID reason). Everyone says to disable auto updates but the problem is that I can't get to the options area to disable the updates (the options area uses IE!!!) so I'm screwed, I have to sit there and click retry 40-50 times several times a day and it's driving me nutz. I've been looking online for days but have not found a solution to this predicament. Is there a way to disable auto updates through the configuration files? Any help is greatly appreciated.

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  • How do networking ports work? Can I configure the ports that client and server use?

    - by joedotnot
    Let's say i have a "server" program listening on address 1.2.3.4:69 (i.e. remote port 69) When i connect from a "client" program to it, typically i would specify the IP address + port of the target or server system; But what port would the client be using ? And how does the server know which port to connect back to the client on? I understand this question is very general, but just wanting to get a general feel for how things work. Then extending this to a specific protocol, say FTP (typical port 21), can I change it such that the server uses port 69, but the client uses port 100? And similarly, for Remote Desktop in WinXP (typical port 3389), i know how to change the server port to be something other than 3389, but how does one change what port the client uses (if at all possible)?

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  • Correct way to inject dependencies in Business logic service?

    - by Sri Harsha Velicheti
    Currently the structure of my application is as below Web App -- WCF Service (just a facade) -- Business Logic Services -- Repository - Entity Framework Datacontext Now each of my Business logic service is dependent on more than 5 repositories ( I have interfaces defined for all the repos) and I am doing a Constructor injection right now(poor mans DI instead of using a proper IOC as it was determined that it would be a overkill for our project). Repositories have references to EF datacontexts. Now some of the methods in the Business logic service require only one of the 5 repositories, so If I need to call that method I would end up instantiating a Service which will instatiate all 5 repositories which is a waste. An example: public class SomeService : ISomeService { public(IFirstRepository repo1, ISecondRepository repo2, IThirdRepository repo3) {} // My DoSomething method depends only on repo1 and doesn't use repo2 and repo3 public DoSomething() { //uses repo1 to do some stuff, doesn't use repo2 and repo3 } public DoSomething2() { //uses repo2 and repo3 to do something, doesn't require repo1 } public DoSomething3() { //uses repo3 to do something, doesn't require repo1 and repo2 } } Now if my I have to use DoSomething method on SomeService I end up creating both IFirstRepository,ISecondRepository and IThirdRepository but using only IFirstRepository, now this is bugging me, I can seem to accept that I am un-necessarily creating repositories and not using them. Is this a correct design? Are there any better alternatives? Should I be looking at Lazy instantiation Lazy<T> ?

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  • For photography use, is Unity is overheating my laptop? Should I try OpenSuse instead?

    - by SoT
    I am a perfect noob here in the Linux world. Previously was using Windows 7. Mine is an HP laptop - Intel core2duo T5470 @ 1.60GHz × 2 / 965GM with 2GB RAM. I installed Ubuntu 12.04TLS and is quite liking it's display. I really recognized it is 3D before knowing it was Unity 3D interface. My uses are image editing, home uses, downloads, browsing etc.. No video-editing/gaming at all. Being a Photography enthusiast I use image editing programs fairly more. But I am now feeling my laptop is getting a bit overheated - processor and hard-disk. I tried lm-sensor and could not make out much of it. Installed Xsensors.7. It gives the same output as lm-sensors gave me. It gives temperature for 4 things Temp1, temp2, temp3, and temp4. For "acpitz". Please guide me in this. However I wanted to ask something more. Which one is better for working with images - photography I mean - openSUSE 12.1 or Ubuntu with unity 3D? Can I get the display quality with the openSUSE distribution? I heard for laptops openSUSE uses power more efficiently, is there any truth? Please suggest me whether I should try openSUSE or not. If so with which GUI? KDE or GNOME? Thanks in advance. Regards SoT

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  • Monorail - Form submission using GET instead of POST

    - by Septih
    Hello, I'm writing some additions to a Castle MonoRail based site involving an Add and an Edit form. The add form works fine and uses POST but the edit form uses GET. The only major difference I can see is that the edit method is called with the Id of the object being edited in the query string. When the submit button is pressed on the edit form, the only argument passed is this object Id again. Here is the code for the edit form: <form action="edit.ashx" method="post"> <h3>Coupon Description</h3> <textarea name="comments" width="200">$comments</textarea> <br/><br/> <h3>Coupon Actions</h3> <br/> <div>Give Stories</div> <ul class="checklist" style="overflow:auto;height:144px;width:100%"> #foreach ($story in $stories.Values) <li> <label> #set ($associated = "") #foreach($storyId in $storyIds) #if($story.Id == $storyId) #set($associated = " checked='true'") #end #end <input type="checkbox" name="chk_${story.Id}" id="chk_${story.Id}" value="true" class="checkbox" $associated/> $story.Name </label> </li> #end </ul> <br/><br/> <div>Give Credit Amount</div> <input type="text" name="credit" value="$credit" /> <br/><br/> <h3>Coupon Uses</h3> <input type="checkbox" name="multi" #if($multi) checked="true" #end /> Multi-Use Coupon?<br/><br/> <b>OR</b> <br/> <br/> Number of Uses per Coupon: <input type="text" name="uses" value="$uses" /> <br/> <input type="submit" name="Save" /> </form> The differences between this and the add form is the velocity stuff to do with association and the values of the inputs being from the PropertyBag. The Method dealing with this on the controller starts like this: public void Edit(int id) { Coupon coupon = Coupon.GetRepository(User.Site.Id).FindById(id).Value; if(coupon == null) { RedirectToReferrer(); return; } IFutureQueryOfList<Story> stories = Story.GetRepository(User.Site.Id).OnlyReturnEnabled().FindAll("Name", true); if (Params["Save"] == null) { ... } } It reliably gets called but a breakpoint on the Params["Save"] lets me see that the HttpMethod is "GET" and the only arguments passed (In the Form and the Request) are the object Id and additional HTTP headers. At the end of the day I'm not that familiar with MonoRail and this may be a stupid mistake on my behalf, but I would very much appreciate being made a fool out of if it fixes the problem! :) Thanks

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  • Delphi Unit local variables - how to make each instance unique?

    - by Justin
    Ok, this, I'm sure is something simple that is easy to do. The problem : I've inherited scary spaghetti code and am slowly trying to better it when new features need adding - generally when a refactor makes adding the new feature neater. I've got a bunch of code I'm packing into a single unit which, in different places in the application, controls the same physical thing in the outside world. The control appears in several places in the application and operates slightly differently in each instance. What I've done is to create a unit with all of the features I need which I can simply drop, as a frame, into each form that requires it. Each form then uses the unit's interface methods to customise the behaviour for each instance. The problem within the problem : In the unit in question (the frame) I have a variable declared in the IMPLEMENTATION section - local to the unit. I also have a procedure, declared in the TYPE section which takes an argument and assigns that argument to the local variable in question - each form passes a unique variable to each instance of the frame/unit. What I want it to do is for each instance of the frame to keep its own version of that variable, different from the others, and use that to define how it operates. What seems to be happening, however, is that all instances are using the same value, even if I explicitly pass each instance a different variable. ie: Unit FlexibleUnit; interface uses //the uses stuff type TFlexibleUnit=class(TFrame) //declarations including procedure makeThisInstanceX(passMeTheVar:integer); private // public // end; implementation uses //the uses var myLocalVar; procedure makeThisInstanceX(passMeTheVar:integer); begin myLocalVar:=passMeTheVar; end; //other procedures using myLocalVar //etc to the end; Now somewhere in another Form I've dropped this Frame onto the Design pane, sometimes two of these frames on one Form, and have it declared in the proper places, etc. Each is unique in that : ThisFlexibleUnit : TFlexibleUnit; ThatFlexibleUnit : TFlexibleUnit; and when I do a: ThisFlexibleUnit.makeThisInstanceX(var1); //want to behave in way "var1" ThatFlexibleUnit.makeThisInstanceX(var2); //want to behave in way "var2" it seems that they both share the same variable "myLocalVar". Am I doing this wrong, in principle? If this is the correct method then it's a matter of debugging what I have (which is too huge to post) but if this is not correct in principle then is there a way to do what I am suggesting? Thanks in advance, Stack Overflow - you guys (and gals!) are legendary.

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  • How to give properties to c++ classes (interfaces)

    - by caas
    Hello, I have built several classes (A, B, C...) which perform operations on the same BaseClass. Example: struct BaseClass { int method1(); int method2(); int method3(); } struct A { int methodA(BaseClass& bc) { return bc.method1(); } } struct B { int methodB(BaseClass& bc) { return bc.method2()+bc.method1(); } } struct C { int methodC(BaseClass& bc) { return bc.method3()+bc.method2(); } } But as you can see, each class A, B, C... only uses a subset of the available methods of the BaseClass and I'd like to split the BaseClass into several chunks such that it is clear what it used and what is not. For example a solution could be to use multiple inheritance: // A uses only method1() struct InterfaceA { virtual int method1() = 0; } struct A { int methodA(InterfaceA&); } // B uses method1() and method2() struct InterfaceB { virtual int method1() = 0; virtual int method2() = 0; } struct B { int methodB(InterfaceB&); } // C uses method2() and method3() struct InterfaceC { virtual int method2() = 0; virtual int method3() = 0; } struct C { int methodC(InterfaceC&); } The problem is that each time I add a new type of operation, I need to change the implementation of BaseClass. For example: // D uses method1() and method3() struct InterfaceD { virtual int method1() = 0; virtual int method3() = 0; } struct D { int methodD(InterfaceD&); } struct BaseClass : public A, B, C // here I need to add class D { ... } Do you know a clean way I can do this? Thanks for your help edit: I forgot to mention that it can also be done with templates. But I don't like this solution either because the required interface does not appear explicitly in the code. You have to try to compile the code to verify that all required methods are implemented correctly. Plus, it would require to instantiate different versions of the classes (one for each BaseClass type template parameter) and this is not always possible nor desired.

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  • Improving Partitioned Table Join Performance

    - by Paul White
    The query optimizer does not always choose an optimal strategy when joining partitioned tables. This post looks at an example, showing how a manual rewrite of the query can almost double performance, while reducing the memory grant to almost nothing. Test Data The two tables in this example use a common partitioning partition scheme. The partition function uses 41 equal-size partitions: CREATE PARTITION FUNCTION PFT (integer) AS RANGE RIGHT FOR VALUES ( 125000, 250000, 375000, 500000, 625000, 750000, 875000, 1000000, 1125000, 1250000, 1375000, 1500000, 1625000, 1750000, 1875000, 2000000, 2125000, 2250000, 2375000, 2500000, 2625000, 2750000, 2875000, 3000000, 3125000, 3250000, 3375000, 3500000, 3625000, 3750000, 3875000, 4000000, 4125000, 4250000, 4375000, 4500000, 4625000, 4750000, 4875000, 5000000 ); GO CREATE PARTITION SCHEME PST AS PARTITION PFT ALL TO ([PRIMARY]); There two tables are: CREATE TABLE dbo.T1 ( TID integer NOT NULL IDENTITY(0,1), Column1 integer NOT NULL, Padding binary(100) NOT NULL DEFAULT 0x,   CONSTRAINT PK_T1 PRIMARY KEY CLUSTERED (TID) ON PST (TID) );   CREATE TABLE dbo.T2 ( TID integer NOT NULL, Column1 integer NOT NULL, Padding binary(100) NOT NULL DEFAULT 0x,   CONSTRAINT PK_T2 PRIMARY KEY CLUSTERED (TID, Column1) ON PST (TID) ); The next script loads 5 million rows into T1 with a pseudo-random value between 1 and 5 for Column1. The table is partitioned on the IDENTITY column TID: INSERT dbo.T1 WITH (TABLOCKX) (Column1) SELECT (ABS(CHECKSUM(NEWID())) % 5) + 1 FROM dbo.Numbers AS N WHERE n BETWEEN 1 AND 5000000; In case you don’t already have an auxiliary table of numbers lying around, here’s a script to create one with 10 million rows: CREATE TABLE dbo.Numbers (n bigint PRIMARY KEY);   WITH L0 AS(SELECT 1 AS c UNION ALL SELECT 1), L1 AS(SELECT 1 AS c FROM L0 AS A CROSS JOIN L0 AS B), L2 AS(SELECT 1 AS c FROM L1 AS A CROSS JOIN L1 AS B), L3 AS(SELECT 1 AS c FROM L2 AS A CROSS JOIN L2 AS B), L4 AS(SELECT 1 AS c FROM L3 AS A CROSS JOIN L3 AS B), L5 AS(SELECT 1 AS c FROM L4 AS A CROSS JOIN L4 AS B), Nums AS(SELECT ROW_NUMBER() OVER (ORDER BY (SELECT NULL)) AS n FROM L5) INSERT dbo.Numbers WITH (TABLOCKX) SELECT TOP (10000000) n FROM Nums ORDER BY n OPTION (MAXDOP 1); Table T1 contains data like this: Next we load data into table T2. The relationship between the two tables is that table 2 contains ‘n’ rows for each row in table 1, where ‘n’ is determined by the value in Column1 of table T1. There is nothing particularly special about the data or distribution, by the way. INSERT dbo.T2 WITH (TABLOCKX) (TID, Column1) SELECT T.TID, N.n FROM dbo.T1 AS T JOIN dbo.Numbers AS N ON N.n >= 1 AND N.n <= T.Column1; Table T2 ends up containing about 15 million rows: The primary key for table T2 is a combination of TID and Column1. The data is partitioned according to the value in column TID alone. Partition Distribution The following query shows the number of rows in each partition of table T1: SELECT PartitionID = CA1.P, NumRows = COUNT_BIG(*) FROM dbo.T1 AS T CROSS APPLY (VALUES ($PARTITION.PFT(TID))) AS CA1 (P) GROUP BY CA1.P ORDER BY CA1.P; There are 40 partitions containing 125,000 rows (40 * 125k = 5m rows). The rightmost partition remains empty. The next query shows the distribution for table 2: SELECT PartitionID = CA1.P, NumRows = COUNT_BIG(*) FROM dbo.T2 AS T CROSS APPLY (VALUES ($PARTITION.PFT(TID))) AS CA1 (P) GROUP BY CA1.P ORDER BY CA1.P; There are roughly 375,000 rows in each partition (the rightmost partition is also empty): Ok, that’s the test data done. Test Query and Execution Plan The task is to count the rows resulting from joining tables 1 and 2 on the TID column: SET STATISTICS IO ON; DECLARE @s datetime2 = SYSUTCDATETIME();   SELECT COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID;   SELECT DATEDIFF(Millisecond, @s, SYSUTCDATETIME()); SET STATISTICS IO OFF; The optimizer chooses a plan using parallel hash join, and partial aggregation: The Plan Explorer plan tree view shows accurate cardinality estimates and an even distribution of rows across threads (click to enlarge the image): With a warm data cache, the STATISTICS IO output shows that no physical I/O was needed, and all 41 partitions were touched: Running the query without actual execution plan or STATISTICS IO information for maximum performance, the query returns in around 2600ms. Execution Plan Analysis The first step toward improving on the execution plan produced by the query optimizer is to understand how it works, at least in outline. The two parallel Clustered Index Scans use multiple threads to read rows from tables T1 and T2. Parallel scan uses a demand-based scheme where threads are given page(s) to scan from the table as needed. This arrangement has certain important advantages, but does result in an unpredictable distribution of rows amongst threads. The point is that multiple threads cooperate to scan the whole table, but it is impossible to predict which rows end up on which threads. For correct results from the parallel hash join, the execution plan has to ensure that rows from T1 and T2 that might join are processed on the same thread. For example, if a row from T1 with join key value ‘1234’ is placed in thread 5’s hash table, the execution plan must guarantee that any rows from T2 that also have join key value ‘1234’ probe thread 5’s hash table for matches. The way this guarantee is enforced in this parallel hash join plan is by repartitioning rows to threads after each parallel scan. The two repartitioning exchanges route rows to threads using a hash function over the hash join keys. The two repartitioning exchanges use the same hash function so rows from T1 and T2 with the same join key must end up on the same hash join thread. Expensive Exchanges This business of repartitioning rows between threads can be very expensive, especially if a large number of rows is involved. The execution plan selected by the optimizer moves 5 million rows through one repartitioning exchange and around 15 million across the other. As a first step toward removing these exchanges, consider the execution plan selected by the optimizer if we join just one partition from each table, disallowing parallelism: SELECT COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID WHERE $PARTITION.PFT(T1.TID) = 1 AND $PARTITION.PFT(T2.TID) = 1 OPTION (MAXDOP 1); The optimizer has chosen a (one-to-many) merge join instead of a hash join. The single-partition query completes in around 100ms. If everything scaled linearly, we would expect that extending this strategy to all 40 populated partitions would result in an execution time around 4000ms. Using parallelism could reduce that further, perhaps to be competitive with the parallel hash join chosen by the optimizer. This raises a question. If the most efficient way to join one partition from each of the tables is to use a merge join, why does the optimizer not choose a merge join for the full query? Forcing a Merge Join Let’s force the optimizer to use a merge join on the test query using a hint: SELECT COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID OPTION (MERGE JOIN); This is the execution plan selected by the optimizer: This plan results in the same number of logical reads reported previously, but instead of 2600ms the query takes 5000ms. The natural explanation for this drop in performance is that the merge join plan is only using a single thread, whereas the parallel hash join plan could use multiple threads. Parallel Merge Join We can get a parallel merge join plan using the same query hint as before, and adding trace flag 8649: SELECT COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID OPTION (MERGE JOIN, QUERYTRACEON 8649); The execution plan is: This looks promising. It uses a similar strategy to distribute work across threads as seen for the parallel hash join. In practice though, performance is disappointing. On a typical run, the parallel merge plan runs for around 8400ms; slower than the single-threaded merge join plan (5000ms) and much worse than the 2600ms for the parallel hash join. We seem to be going backwards! The logical reads for the parallel merge are still exactly the same as before, with no physical IOs. The cardinality estimates and thread distribution are also still very good (click to enlarge): A big clue to the reason for the poor performance is shown in the wait statistics (captured by Plan Explorer Pro): CXPACKET waits require careful interpretation, and are most often benign, but in this case excessive waiting occurs at the repartitioning exchanges. Unlike the parallel hash join, the repartitioning exchanges in this plan are order-preserving ‘merging’ exchanges (because merge join requires ordered inputs): Parallelism works best when threads can just grab any available unit of work and get on with processing it. Preserving order introduces inter-thread dependencies that can easily lead to significant waits occurring. In extreme cases, these dependencies can result in an intra-query deadlock, though the details of that will have to wait for another time to explore in detail. The potential for waits and deadlocks leads the query optimizer to cost parallel merge join relatively highly, especially as the degree of parallelism (DOP) increases. This high costing resulted in the optimizer choosing a serial merge join rather than parallel in this case. The test results certainly confirm its reasoning. Collocated Joins In SQL Server 2008 and later, the optimizer has another available strategy when joining tables that share a common partition scheme. This strategy is a collocated join, also known as as a per-partition join. It can be applied in both serial and parallel execution plans, though it is limited to 2-way joins in the current optimizer. Whether the optimizer chooses a collocated join or not depends on cost estimation. The primary benefits of a collocated join are that it eliminates an exchange and requires less memory, as we will see next. Costing and Plan Selection The query optimizer did consider a collocated join for our original query, but it was rejected on cost grounds. The parallel hash join with repartitioning exchanges appeared to be a cheaper option. There is no query hint to force a collocated join, so we have to mess with the costing framework to produce one for our test query. Pretending that IOs cost 50 times more than usual is enough to convince the optimizer to use collocated join with our test query: -- Pretend IOs are 50x cost temporarily DBCC SETIOWEIGHT(50);   -- Co-located hash join SELECT COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID OPTION (RECOMPILE);   -- Reset IO costing DBCC SETIOWEIGHT(1); Collocated Join Plan The estimated execution plan for the collocated join is: The Constant Scan contains one row for each partition of the shared partitioning scheme, from 1 to 41. The hash repartitioning exchanges seen previously are replaced by a single Distribute Streams exchange using Demand partitioning. Demand partitioning means that the next partition id is given to the next parallel thread that asks for one. My test machine has eight logical processors, and all are available for SQL Server to use. As a result, there are eight threads in the single parallel branch in this plan, each processing one partition from each table at a time. Once a thread finishes processing a partition, it grabs a new partition number from the Distribute Streams exchange…and so on until all partitions have been processed. It is important to understand that the parallel scans in this plan are different from the parallel hash join plan. Although the scans have the same parallelism icon, tables T1 and T2 are not being co-operatively scanned by multiple threads in the same way. Each thread reads a single partition of T1 and performs a hash match join with the same partition from table T2. The properties of the two Clustered Index Scans show a Seek Predicate (unusual for a scan!) limiting the rows to a single partition: The crucial point is that the join between T1 and T2 is on TID, and TID is the partitioning column for both tables. A thread that processes partition ‘n’ is guaranteed to see all rows that can possibly join on TID for that partition. In addition, no other thread will see rows from that partition, so this removes the need for repartitioning exchanges. CPU and Memory Efficiency Improvements The collocated join has removed two expensive repartitioning exchanges and added a single exchange processing 41 rows (one for each partition id). Remember, the parallel hash join plan exchanges had to process 5 million and 15 million rows. The amount of processor time spent on exchanges will be much lower in the collocated join plan. In addition, the collocated join plan has a maximum of 8 threads processing single partitions at any one time. The 41 partitions will all be processed eventually, but a new partition is not started until a thread asks for it. Threads can reuse hash table memory for the new partition. The parallel hash join plan also had 8 hash tables, but with all 5,000,000 build rows loaded at the same time. The collocated plan needs memory for only 8 * 125,000 = 1,000,000 rows at any one time. Collocated Hash Join Performance The collated join plan has disappointing performance in this case. The query runs for around 25,300ms despite the same IO statistics as usual. This is much the worst result so far, so what went wrong? It turns out that cardinality estimation for the single partition scans of table T1 is slightly low. The properties of the Clustered Index Scan of T1 (graphic immediately above) show the estimation was for 121,951 rows. This is a small shortfall compared with the 125,000 rows actually encountered, but it was enough to cause the hash join to spill to physical tempdb: A level 1 spill doesn’t sound too bad, until you realize that the spill to tempdb probably occurs for each of the 41 partitions. As a side note, the cardinality estimation error is a little surprising because the system tables accurately show there are 125,000 rows in every partition of T1. Unfortunately, the optimizer uses regular column and index statistics to derive cardinality estimates here rather than system table information (e.g. sys.partitions). Collocated Merge Join We will never know how well the collocated parallel hash join plan might have worked without the cardinality estimation error (and the resulting 41 spills to tempdb) but we do know: Merge join does not require a memory grant; and Merge join was the optimizer’s preferred join option for a single partition join Putting this all together, what we would really like to see is the same collocated join strategy, but using merge join instead of hash join. Unfortunately, the current query optimizer cannot produce a collocated merge join; it only knows how to do collocated hash join. So where does this leave us? CROSS APPLY sys.partitions We can try to write our own collocated join query. We can use sys.partitions to find the partition numbers, and CROSS APPLY to get a count per partition, with a final step to sum the partial counts. The following query implements this idea: SELECT row_count = SUM(Subtotals.cnt) FROM ( -- Partition numbers SELECT p.partition_number FROM sys.partitions AS p WHERE p.[object_id] = OBJECT_ID(N'T1', N'U') AND p.index_id = 1 ) AS P CROSS APPLY ( -- Count per collocated join SELECT cnt = COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID WHERE $PARTITION.PFT(T1.TID) = p.partition_number AND $PARTITION.PFT(T2.TID) = p.partition_number ) AS SubTotals; The estimated plan is: The cardinality estimates aren’t all that good here, especially the estimate for the scan of the system table underlying the sys.partitions view. Nevertheless, the plan shape is heading toward where we would like to be. Each partition number from the system table results in a per-partition scan of T1 and T2, a one-to-many Merge Join, and a Stream Aggregate to compute the partial counts. The final Stream Aggregate just sums the partial counts. Execution time for this query is around 3,500ms, with the same IO statistics as always. This compares favourably with 5,000ms for the serial plan produced by the optimizer with the OPTION (MERGE JOIN) hint. This is another case of the sum of the parts being less than the whole – summing 41 partial counts from 41 single-partition merge joins is faster than a single merge join and count over all partitions. Even so, this single-threaded collocated merge join is not as quick as the original parallel hash join plan, which executed in 2,600ms. On the positive side, our collocated merge join uses only one logical processor and requires no memory grant. The parallel hash join plan used 16 threads and reserved 569 MB of memory:   Using a Temporary Table Our collocated merge join plan should benefit from parallelism. The reason parallelism is not being used is that the query references a system table. We can work around that by writing the partition numbers to a temporary table (or table variable): SET STATISTICS IO ON; DECLARE @s datetime2 = SYSUTCDATETIME();   CREATE TABLE #P ( partition_number integer PRIMARY KEY);   INSERT #P (partition_number) SELECT p.partition_number FROM sys.partitions AS p WHERE p.[object_id] = OBJECT_ID(N'T1', N'U') AND p.index_id = 1;   SELECT row_count = SUM(Subtotals.cnt) FROM #P AS p CROSS APPLY ( SELECT cnt = COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID WHERE $PARTITION.PFT(T1.TID) = p.partition_number AND $PARTITION.PFT(T2.TID) = p.partition_number ) AS SubTotals;   DROP TABLE #P;   SELECT DATEDIFF(Millisecond, @s, SYSUTCDATETIME()); SET STATISTICS IO OFF; Using the temporary table adds a few logical reads, but the overall execution time is still around 3500ms, indistinguishable from the same query without the temporary table. The problem is that the query optimizer still doesn’t choose a parallel plan for this query, though the removal of the system table reference means that it could if it chose to: In fact the optimizer did enter the parallel plan phase of query optimization (running search 1 for a second time): Unfortunately, the parallel plan found seemed to be more expensive than the serial plan. This is a crazy result, caused by the optimizer’s cost model not reducing operator CPU costs on the inner side of a nested loops join. Don’t get me started on that, we’ll be here all night. In this plan, everything expensive happens on the inner side of a nested loops join. Without a CPU cost reduction to compensate for the added cost of exchange operators, candidate parallel plans always look more expensive to the optimizer than the equivalent serial plan. Parallel Collocated Merge Join We can produce the desired parallel plan using trace flag 8649 again: SELECT row_count = SUM(Subtotals.cnt) FROM #P AS p CROSS APPLY ( SELECT cnt = COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID WHERE $PARTITION.PFT(T1.TID) = p.partition_number AND $PARTITION.PFT(T2.TID) = p.partition_number ) AS SubTotals OPTION (QUERYTRACEON 8649); The actual execution plan is: One difference between this plan and the collocated hash join plan is that a Repartition Streams exchange operator is used instead of Distribute Streams. The effect is similar, though not quite identical. The Repartition uses round-robin partitioning, meaning the next partition id is pushed to the next thread in sequence. The Distribute Streams exchange seen earlier used Demand partitioning, meaning the next partition id is pulled across the exchange by the next thread that is ready for more work. There are subtle performance implications for each partitioning option, but going into that would again take us too far off the main point of this post. Performance The important thing is the performance of this parallel collocated merge join – just 1350ms on a typical run. The list below shows all the alternatives from this post (all timings include creation, population, and deletion of the temporary table where appropriate) from quickest to slowest: Collocated parallel merge join: 1350ms Parallel hash join: 2600ms Collocated serial merge join: 3500ms Serial merge join: 5000ms Parallel merge join: 8400ms Collated parallel hash join: 25,300ms (hash spill per partition) The parallel collocated merge join requires no memory grant (aside from a paltry 1.2MB used for exchange buffers). This plan uses 16 threads at DOP 8; but 8 of those are (rather pointlessly) allocated to the parallel scan of the temporary table. These are minor concerns, but it turns out there is a way to address them if it bothers you. Parallel Collocated Merge Join with Demand Partitioning This final tweak replaces the temporary table with a hard-coded list of partition ids (dynamic SQL could be used to generate this query from sys.partitions): SELECT row_count = SUM(Subtotals.cnt) FROM ( VALUES (1),(2),(3),(4),(5),(6),(7),(8),(9),(10), (11),(12),(13),(14),(15),(16),(17),(18),(19),(20), (21),(22),(23),(24),(25),(26),(27),(28),(29),(30), (31),(32),(33),(34),(35),(36),(37),(38),(39),(40),(41) ) AS P (partition_number) CROSS APPLY ( SELECT cnt = COUNT_BIG(*) FROM dbo.T1 AS T1 JOIN dbo.T2 AS T2 ON T2.TID = T1.TID WHERE $PARTITION.PFT(T1.TID) = p.partition_number AND $PARTITION.PFT(T2.TID) = p.partition_number ) AS SubTotals OPTION (QUERYTRACEON 8649); The actual execution plan is: The parallel collocated hash join plan is reproduced below for comparison: The manual rewrite has another advantage that has not been mentioned so far: the partial counts (per partition) can be computed earlier than the partial counts (per thread) in the optimizer’s collocated join plan. The earlier aggregation is performed by the extra Stream Aggregate under the nested loops join. The performance of the parallel collocated merge join is unchanged at around 1350ms. Final Words It is a shame that the current query optimizer does not consider a collocated merge join (Connect item closed as Won’t Fix). The example used in this post showed an improvement in execution time from 2600ms to 1350ms using a modestly-sized data set and limited parallelism. In addition, the memory requirement for the query was almost completely eliminated  – down from 569MB to 1.2MB. The problem with the parallel hash join selected by the optimizer is that it attempts to process the full data set all at once (albeit using eight threads). It requires a large memory grant to hold all 5 million rows from table T1 across the eight hash tables, and does not take advantage of the divide-and-conquer opportunity offered by the common partitioning. The great thing about the collocated join strategies is that each parallel thread works on a single partition from both tables, reading rows, performing the join, and computing a per-partition subtotal, before moving on to a new partition. From a thread’s point of view… If you have trouble visualizing what is happening from just looking at the parallel collocated merge join execution plan, let’s look at it again, but from the point of view of just one thread operating between the two Parallelism (exchange) operators. Our thread picks up a single partition id from the Distribute Streams exchange, and starts a merge join using ordered rows from partition 1 of table T1 and partition 1 of table T2. By definition, this is all happening on a single thread. As rows join, they are added to a (per-partition) count in the Stream Aggregate immediately above the Merge Join. Eventually, either T1 (partition 1) or T2 (partition 1) runs out of rows and the merge join stops. The per-partition count from the aggregate passes on through the Nested Loops join to another Stream Aggregate, which is maintaining a per-thread subtotal. Our same thread now picks up a new partition id from the exchange (say it gets id 9 this time). The count in the per-partition aggregate is reset to zero, and the processing of partition 9 of both tables proceeds just as it did for partition 1, and on the same thread. Each thread picks up a single partition id and processes all the data for that partition, completely independently from other threads working on other partitions. One thread might eventually process partitions (1, 9, 17, 25, 33, 41) while another is concurrently processing partitions (2, 10, 18, 26, 34) and so on for the other six threads at DOP 8. The point is that all 8 threads can execute independently and concurrently, continuing to process new partitions until the wider job (of which the thread has no knowledge!) is done. This divide-and-conquer technique can be much more efficient than simply splitting the entire workload across eight threads all at once. Related Reading Understanding and Using Parallelism in SQL Server Parallel Execution Plans Suck © 2013 Paul White – All Rights Reserved Twitter: @SQL_Kiwi

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  • Bug in Delphi XE RegularExpressions Unit

    - by Jan Goyvaerts
    Using the new RegularExpressions unit in Delphi XE, you can iterate over all the matches that a regex finds in a string like this: procedure TForm1.Button1Click(Sender: TObject); var RegEx: TRegEx; Match: TMatch; begin RegEx := TRegex.Create('\w+'); Match := RegEx.Match('One two three four'); while Match.Success do begin Memo1.Lines.Add(Match.Value); Match := Match.NextMatch; end end; Or you could save yourself two lines of code by using the static TRegEx.Match call: procedure TForm1.Button2Click(Sender: TObject); var Match: TMatch; begin Match := TRegEx.Match('One two three four', '\w+'); while Match.Success do begin Memo1.Lines.Add(Match.Value); Match := Match.NextMatch; end end; Unfortunately, due to a bug in the RegularExpressions unit, the static call doesn’t work. Depending on your exact code, you may get fewer matches or blank matches than you should, or your application may crash with an access violation. The RegularExpressions unit defines TRegEx and TMatch as records. That way you don’t have to explicitly create and destroy them. Internally, TRegEx uses TPerlRegEx to do the heavy lifting. TPerlRegEx is a class that needs to be created and destroyed like any other class. If you look at the TRegEx source code, you’ll notice that it uses an interface to destroy the TPerlRegEx instance when TRegEx goes out of scope. Interfaces are reference counted in Delphi, making them usable for automatic memory management. The bug is that TMatch and TGroupCollection also need the TPerlRegEx instance to do their work. TRegEx passes its TPerlRegEx instance to TMatch and TGroupCollection, but it does not pass the instance of the interface that is responsible for destroying TPerlRegEx. This is not a problem in our first code sample. TRegEx stays in scope until we’re done with TMatch. The interface is destroyed when Button1Click exits. In the second code sample, the static TRegEx.Match call creates a local variable of type TRegEx. This local variable goes out of scope when TRegEx.Match returns. Thus the reference count on the interface reaches zero and TPerlRegEx is destroyed when TRegEx.Match returns. When we call MatchAgain the TMatch record tries to use a TPerlRegEx instance that has already been destroyed. To fix this bug, delete or rename the two RegularExpressions.dcu files and copy RegularExpressions.pas into your source code folder. Make these changes to both the TMatch and TGroupCollection records in this unit: Declare FNotifier: IInterface; in the private section. Add the parameter ANotifier: IInterface; to the Create constructor. Assign FNotifier := ANotifier; in the constructor’s implementation. You also need to add the ANotifier: IInterface; parameter to the TMatchCollection.Create constructor. Now try to compile some code that uses the RegularExpressions unit. The compiler will flag all calls to TMatch.Create, TGroupCollection.Create and TMatchCollection.Create. Fix them by adding the ANotifier or FNotifier parameter, depending on whether ARegEx or FRegEx is being passed. With these fixes, the TPerlRegEx instance won’t be destroyed until the last TRegEx, TMatch, or TGroupCollection that uses it goes out of scope or is used with a different regular expression.

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  • Using Windows and MMSystem in Delphi

    - by Jose Martinez
    Hi I am making a program to open and close the cd reader in which I have thought to write data to CD, the problem is the basis of the problem, which use "uses Windows 'and' uses MMSystem" but the problem is that when I use both at the same time being "uses Windows, MMSystem" gives an error and the program does not compile, I am using Delphi 2010, the strange thing is that when I use only one either Windows or MMSystem works fine and compiles. The error when I try to compile is: 'Could not find program' The code in question is this: mciSendString ('Set cdaudio door open wait', nil, 0, handle); I have two things to ask you first is how I avoid the error when using the two (Windows and MMSystem) and the other question was if he could open the CD player without using MMSystem, bone using Windows API, but not where to start The source : program Project1; {$APPTYPE CONSOLE} uses SysUtils,Windows,MMSystem; procedure opencd; begin mciSendString('Set cdaudio door open wait', nil, 0, 0); end; begin try Writeln('test'); except on E: Exception do Writeln(E.ClassName, ': ', E.Message); end; end. Image :

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  • Get Eclipse to recognize the maps api

    - by NickTFried
    Hi I'm developing an Android app and trying to incorporate maps into one of my sub-activities. Having followed all of the instructions from Android, my java file will not recognize the "MapActivity" or the import statements to include the needed api. Here is my XML manifest and my class file. <?xml version="1.0" encoding="utf-8"?> <uses-permission android:name="android.permissions.INTERNET"/> <uses-permission android:name="android.permissions.ACCESS_FINE_LOCATION"/> <application android:icon="@drawable/icon" android:label="@string/app_name"> <uses-library android:name="com.google.android.maps" /> <activity android:name=".CadetCommand" android:label="@string/app_name"> <intent-filter> <action android:name="android.intent.action.MAIN" /> <category android:name="android.intent.category.LAUNCHER" /> </intent-filter> </activity> <activity android:name="RedLight"></activity> <activity android:name="PTCalculator"></activity> </application> <uses-sdk android:minSdkVersion="7"/> here is my java file: package edu.elon.cs.mobile; import com.google.android.maps.MapActivity; import com.google.android.maps.MapView; import android.os.Bundle; public class LandNav extends MapActivity{ } Any suggestion would help.

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  • eclipse, one classpath for compiling, another for launching

    - by DragonFax
    example: For logging, my code uses log4j. but other jars my code is dependent upon, uses slf4j instead. So both jars must be in the build path. Unfortunately, its possible for my code to directly use (depend on) slf4j now, either by context-assist, or some other developers changes. I would like any use of slf4j to show up as an error, but my application (and tests) will still need it in the classpath when running. explanation: I'd like to find out if this is possible in eclipse. This scenario happens often for me. I'll have a large project, that uses alot of 3rd party libraries. And of course those 3rd party jars have their own dependencies as well. So I have to include all dependencies in the classpath ("build path" in eclipse) for the application and its tests to compile and run (from within eclipse). But I don't want my code to use all of those jars, just the few direct dependencies I've decided upon myself. So if my code accidentally uses a dependency of a dependency, I want it to show up as a compilation error. Ideally, as class not found, but any error would do. I know I can manually configure the classpath when running outside of eclipse, and even within eclipse I can modify the classpath for a specific class I'm running (in the run configurations), but thats not manageable if you run alot of individual test cases, or have alot of main() classes.

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  • Sharepoint user details not visible to other users

    - by richardoz
    I am managing a SharePoint site that uses Form Based Authentication. We have several generic lists, document libraries and active task lists that users can create update and delete. Users can use the people pickers to select/search for everyone. But the users cannot see other users names, email addresses etc. in display lists or the people pickers. If I log in as the site collection administrator, I can see everyones details. So I know the data is available. Updated details on this problem (non-administrators) SharePoint users cannot see other users information. Example: User A assigns a task to user B. User A creates a new task and uses the people picker to find user B. User B is only visible by the login name “bname” and any information about user B is not visible or searchable within the people picker. Once user B is assigned the task, user A no longer sees the name in the task list – even though user A created it. No modified by, created by, assigned to or owner field data is visible to non-administrator users. Facts: Extranet site is configured to use Forms Based Authentication. Intranet uses windows based authentication Users of both the intranet and extranet have the same problem All databases are local The site uses SSRS integration SharePoint WSS on Windows 2003 Std -- After activating the verbose logging it looks like SharePoint is definately asking SQL server for only the user info for the currently logged in user: SELECT TOP 6 /lots-of-columns/ FROM UserData INNER MERGE JOIN Docs AS t1 ON ( 1 = 1 AND UserData.[tp_RowOrdinal] = 0 AND t1.SiteId = UserData.tp_SiteId AND t1.SiteId = @L2 AND t1.DirName = UserData.tp_DirName AND t1.LeafName = UserData.tp_LeafName AND t1.Level = UserData.tp_Level AND t1.IsCurrentVersion = 1 AND (1 = 1) ) LEFT OUTER JOIN AllUserData AS t2 ON ( UserData.[tp_Author]=t2.[tp_ID] AND UserData.[tp_RowOrdinal] = 0 AND t2.[tp_RowOrdinal] = 0 AND ( (t2.tp_IsCurrent = 1) ) AND t2.[tp_CalculatedVersion] = 0 AND t2.[tp_DeleteTransactionId] = 0x AND t2.tp_ListId = @L3 AND UserData.tp_ListId = @L4 AND t2.[tp_Author]=162 /* this is the currently logged in user */ ) WHERE (UserData.tp_IsCurrent = 1) AND UserData.tp_SiteId=@L2 AND (UserData.tp_DirName=@DN) AND UserData.tp_RowOrdinal=0 AND ( ( (UserData.[datetime1] IS NULL ) OR (UserData.[datetime1] = @L5DTP) ) AND t1.SiteId=@L2 AND (t1.DirName=@DN) ) ORDER BY UserData.[tp_Modified] Desc, UserData.[tp_ID] Asc Again, any ideas would be appreciated.

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  • My android tests don't get internet access!

    - by Malachii
    The subject says it all. My application gets internet access thanks to the android.permission.INTERNET permission, but my test cases don't while using the instrumentation test runner. This means I can't test my server IO routines in my test cases. What's up? Here's my manifest in case it helps you. Thanks! Sorry about the lack of indents - could not get it working on short notice with this site. Thanks! <manifest xmlns:android="http://schemas.android.com/apk/res/android" package="com.example.helloandroid" android:versionCode="1" android:versionName="1.0"> <uses-permission android:name="android.permission.INTERNET"></uses-permission> <application android:icon="@drawable/icon" android:label="@string/app_name"> <uses-library android:name="android.test.runner" /> <activity android:name=".HelloAndroid" android:label="@string/app_name"> <intent-filter> <action android:name="android.intent.action.MAIN" /> <category android:name="android.intent.category.LAUNCHER" /> </intent-filter> </activity> </application> <uses-sdk android:minSdkVersion="2" /> <instrumentation android:name="android.test.InstrumentationTestRunner" android:targetPackage="qnext.mobile.redirect" android:label="Qnext Redirect Tests" /> </manifest>

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  • Does anyone know why my maps only show grid

    - by NickTFried
    I've doubled checked my API key is right and that is right I doubled checked that it was correct. Here is my source and XML could anyone check to see what is wrong. Also I make sure I have internet. <?xml version="1.0" encoding="utf-8"?> <uses-permission android:name="android.permissions.INTERNET"/> <uses-permission android:name="android.permissions.ACCESS_FINE_LOCATION"/> <application android:icon="@drawable/icon" android:label="@string/app_name"> <uses-library android:name="com.google.android.maps" /> <activity android:name=".CadetCommand" android:label="@string/app_name"> <intent-filter> <action android:name="android.intent.action.MAIN" /> <category android:name="android.intent.category.LAUNCHER" /> </intent-filter> </activity> <activity android:name="RedLight"></activity> <activity android:name="PTCalculator"></activity> <activity android:name="LandNav"></activity> </application> <uses-sdk android:minSdkVersion="4"/> package edu.elon.cs.mobile; import com.google.android.maps.MapActivity; import com.google.android.maps.MapView; import android.os.Bundle; public class LandNav extends MapActivity{ public void onCreate(Bundle savedInstanceState) { super.onCreate(savedInstanceState); setContentView(R.layout.landnav); } @Override protected boolean isRouteDisplayed() { return false; } }

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  • Android OS 2.2 Permissions: I have absolutely no idea why this simple piece of code doesn't work. Wh

    - by Kevin
    I'm just playing around with some code. I create an Activity and simply do something like this: long lo = currentTimeMillis(); System.out.println(lo); lo *= 3; System.out.println(lo); SystemClock.setCurrentTimeMillis(lo); System.out.println( currentTimeMillis() ); Yes, in my AndroidManifest.xml, I've added: <uses-permission android:name="android.permission.SET_TIME"></uses-permission> <uses-permission android:name="android.permission.SET_TIME_ZONE"></uses-permission> Nothing changes. The SystemClock is never reset...it just keeps on ticking. The error that I'm getting just says that the permission "SET_TIME" was not granted to the program. Protection level 3. The permissions are there...and in the API for 2.2 it says that this feature is supported now. I have no idea what I'm doing wrong. If android.content.Intent; comes into play, please explain. I don't really understand what the idea behind intents! Thanks for any help!

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